Tag Archives: nature

Securing Elections

Post Syndicated from Bruce Schneier original https://www.schneier.com/blog/archives/2018/04/securing_electi_1.html

Elections serve two purposes. The first, and obvious, purpose is to accurately choose the winner. But the second is equally important: to convince the loser. To the extent that an election system is not transparently and auditably accurate, it fails in that second purpose. Our election systems are failing, and we need to fix them.

Today, we conduct our elections on computers. Our registration lists are in computer databases. We vote on computerized voting machines. And our tabulation and reporting is done on computers. We do this for a lot of good reasons, but a side effect is that elections now have all the insecurities inherent in computers. The only way to reliably protect elections from both malice and accident is to use something that is not hackable or unreliable at scale; the best way to do that is to back up as much of the system as possible with paper.

Recently, there have been two graphic demonstrations of how bad our computerized voting system is. In 2007, the states of California and Ohio conducted audits of their electronic voting machines. Expert review teams found exploitable vulnerabilities in almost every component they examined. The researchers were able to undetectably alter vote tallies, erase audit logs, and load malware on to the systems. Some of their attacks could be implemented by a single individual with no greater access than a normal poll worker; others could be done remotely.

Last year, the Defcon hackers’ conference sponsored a Voting Village. Organizers collected 25 pieces of voting equipment, including voting machines and electronic poll books. By the end of the weekend, conference attendees had found ways to compromise every piece of test equipment: to load malicious software, compromise vote tallies and audit logs, or cause equipment to fail.

It’s important to understand that these were not well-funded nation-state attackers. These were not even academics who had been studying the problem for weeks. These were bored hackers, with no experience with voting machines, playing around between parties one weekend.

It shouldn’t be any surprise that voting equipment, including voting machines, voter registration databases, and vote tabulation systems, are that hackable. They’re computers — often ancient computers running operating systems no longer supported by the manufacturers — and they don’t have any magical security technology that the rest of the industry isn’t privy to. If anything, they’re less secure than the computers we generally use, because their manufacturers hide any flaws behind the proprietary nature of their equipment.

We’re not just worried about altering the vote. Sometimes causing widespread failures, or even just sowing mistrust in the system, is enough. And an election whose results are not trusted or believed is a failed election.

Voting systems have another requirement that makes security even harder to achieve: the requirement for a secret ballot. Because we have to securely separate the election-roll system that determines who can vote from the system that collects and tabulates the votes, we can’t use the security systems available to banking and other high-value applications.

We can securely bank online, but can’t securely vote online. If we could do away with anonymity — if everyone could check that their vote was counted correctly — then it would be easy to secure the vote. But that would lead to other problems. Before the US had the secret ballot, voter coercion and vote-buying were widespread.

We can’t, so we need to accept that our voting systems are insecure. We need an election system that is resilient to the threats. And for many parts of the system, that means paper.

Let’s start with the voter rolls. We know they’ve already been targeted. In 2016, someone changed the party affiliation of hundreds of voters before the Republican primary. That’s just one possibility. A well-executed attack that deletes, for example, one in five voters at random — or changes their addresses — would cause chaos on election day.

Yes, we need to shore up the security of these systems. We need better computer, network, and database security for the various state voter organizations. We also need to better secure the voter registration websites, with better design and better internet security. We need better security for the companies that build and sell all this equipment.

Multiple, unchangeable backups are essential. A record of every addition, deletion, and change needs to be stored on a separate system, on write-only media like a DVD. Copies of that DVD, or — even better — a paper printout of the voter rolls, should be available at every polling place on election day. We need to be ready for anything.

Next, the voting machines themselves. Security researchers agree that the gold standard is a voter-verified paper ballot. The easiest (and cheapest) way to achieve this is through optical-scan voting. Voters mark paper ballots by hand; they are fed into a machine and counted automatically. That paper ballot is saved, and serves as a final true record in a recount in case of problems. Touch-screen machines that print a paper ballot to drop in a ballot box can also work for voters with disabilities, as long as the ballot can be easily read and verified by the voter.

Finally, the tabulation and reporting systems. Here again we need more security in the process, but we must always use those paper ballots as checks on the computers. A manual, post-election, risk-limiting audit varies the number of ballots examined according to the margin of victory. Conducting this audit after every election, before the results are certified, gives us confidence that the election outcome is correct, even if the voting machines and tabulation computers have been tampered with. Additionally, we need better coordination and communications when incidents occur.

It’s vital to agree on these procedures and policies before an election. Before the fact, when anyone can win and no one knows whose votes might be changed, it’s easy to agree on strong security. But after the vote, someone is the presumptive winner — and then everything changes. Half of the country wants the result to stand, and half wants it reversed. At that point, it’s too late to agree on anything.

The politicians running in the election shouldn’t have to argue their challenges in court. Getting elections right is in the interest of all citizens. Many countries have independent election commissions that are charged with conducting elections and ensuring their security. We don’t do that in the US.

Instead, we have representatives from each of our two parties in the room, keeping an eye on each other. That provided acceptable security against 20th-century threats, but is totally inadequate to secure our elections in the 21st century. And the belief that the diversity of voting systems in the US provides a measure of security is a dangerous myth, because few districts can be decisive and there are so few voting-machine vendors.

We can do better. In 2017, the Department of Homeland Security declared elections to be critical infrastructure, allowing the department to focus on securing them. On 23 March, Congress allocated $380m to states to upgrade election security.

These are good starts, but don’t go nearly far enough. The constitution delegates elections to the states but allows Congress to “make or alter such Regulations”. In 1845, Congress set a nationwide election day. Today, we need it to set uniform and strict election standards.

This essay originally appeared in the Guardian.

[$] Counting beans—and more—with Beancount

Post Syndicated from jake original https://lwn.net/Articles/751874/rss

It is normally the grumpy editor’s job to look
at accounting software
; he does so with an eye toward getting the business off of the
proprietary QuickBooks application and moving to something free. It may be
that Beancount deserves a look of
that nature before too long but, in the meantime, a slightly less grumpy
editor has been messing with this text-based accounting tool for a variety
of much smaller projects. It is an interesting system, with a lot of
capabilities, but its reliance on hand-rolling for various pieces
may scare some folks off.

The DMCA and its Chilling Effects on Research

Post Syndicated from Bruce Schneier original https://www.schneier.com/blog/archives/2018/04/the_dmca_and_it.html

The Center for Democracy and Technology has a good summary of the current state of the DMCA’s chilling effects on security research.

To underline the nature of chilling effects on hacking and security research, CDT has worked to describe how tinkerers, hackers, and security researchers of all types both contribute to a baseline level of security in our digital environment and, in turn, are shaped themselves by this environment, most notably when things they do upset others and result in threats, potential lawsuits, and prosecution. We’ve published two reports (sponsored by the Hewlett Foundation and MacArthur Foundation) about needed reforms to the law and the myriad of ways that security research directly improves people’s lives. To get a more complete picture, we wanted to talk to security researchers themselves and gauge the forces that shape their work; essentially, we wanted to “take the pulse” of the security research community.

Today, we are releasing a third report in service of this effort: “Taking the Pulse of Hacking: A Risk Basis for Security Research.” We report findings after having interviewed a set of 20 security researchers and hackers — half academic and half non-academic — about what considerations they take into account when starting new projects or engaging in new work, as well as to what extent they or their colleagues have faced threats in the past that chilled their work. The results in our report show that a wide variety of constraints shape the work they do, from technical constraints to ethical boundaries to legal concerns, including the DMCA and especially the CFAA.

Note: I am a signatory on the letter supporting unrestricted security research.

Using AWS Lambda and Amazon Comprehend for sentiment analysis

Post Syndicated from Chris Munns original https://aws.amazon.com/blogs/compute/using-aws-lambda-and-amazon-comprehend-for-sentiment-analysis/

This post courtesy of Giedrius Praspaliauskas, AWS Solutions Architect

Even with best IVR systems, customers get frustrated. What if you knew that 10 callers in your Amazon Connect contact flow were likely to say “Agent!” in frustration in the next 30 seconds? Would you like to get to them before that happens? What if your bot was smart enough to admit, “I’m sorry this isn’t helping. Let me find someone for you.”?

In this post, I show you how to use AWS Lambda and Amazon Comprehend for sentiment analysis to make your Amazon Lex bots in Amazon Connect more sympathetic.

Setting up a Lambda function for sentiment analysis

There are multiple natural language and text processing frameworks or services available to use with Lambda, including but not limited to Amazon Comprehend, TextBlob, Pattern, and NLTK. Pick one based on the nature of your system:  the type of interaction, languages supported, and so on. For this post, I picked Amazon Comprehend, which uses natural language processing (NLP) to extract insights and relationships in text.

The walkthrough in this post is just an example. In a full-scale implementation, you would likely implement a more nuanced approach. For example, you could keep the overall sentiment score through the conversation and act only when it reaches a certain threshold. It is worth noting that this Lambda function is not called for missed utterances, so there may be a gap between what is being analyzed and what was actually said.

The Lambda function is straightforward. It analyses the input transcript field of the Amazon Lex event. Based on the overall sentiment value, it generates a response message with next step instructions. When the sentiment is neutral, positive, or mixed, the response leaves it to Amazon Lex to decide what the next steps should be. It adds to the response overall sentiment value as an additional session attribute, along with slots’ values received as an input.

When the overall sentiment is negative, the function returns the dialog action, pointing to an escalation intent (specified in the environment variable ESCALATION_INTENT_NAME) or returns the fulfillment closure action with a failure state when the intent is not specified. In addition to actions or intents, the function returns a message, or prompt, to be provided to the customer before taking the next step. Based on the returned action, Amazon Connect can select the appropriate next step in a contact flow.

For this walkthrough, you create a Lambda function using the AWS Management Console:

  1. Open the Lambda console.
  2. Choose Create Function.
  3. Choose Author from scratch (no blueprint).
  4. For Runtime, choose Python 3.6.
  5. For Role, choose Create a custom role. The custom execution role allows the function to detect sentiments, create a log group, stream log events, and store the log events.
  6. Enter the following values:
    • For Role Description, enter Lambda execution role permissions.
    • For IAM Role, choose Create an IAM role.
    • For Role Name, enter LexSentimentAnalysisLambdaRole.
    • For Policy, use the following policy:
{
    "Version": "2012-10-17",
    "Statement": [
        {
            "Effect": "Allow",
            "Action": [
                "logs:CreateLogGroup",
                "logs:CreateLogStream",
                "logs:PutLogEvents"
            ],
            "Resource": "arn:aws:logs:*:*:*"
        },
        {
            "Action": [
                "comprehend:DetectDominantLanguage",
                "comprehend:DetectSentiment"
            ],
            "Effect": "Allow",
            "Resource": "*"
        }
    ]
}
    1. Choose Create function.
    2. Copy/paste the following code to the editor window
import os, boto3

ESCALATION_INTENT_MESSAGE="Seems that you are having troubles with our service. Would you like to be transferred to the associate?"
FULFILMENT_CLOSURE_MESSAGE="Seems that you are having troubles with our service. Let me transfer you to the associate."

escalation_intent_name = os.getenv('ESACALATION_INTENT_NAME', None)

client = boto3.client('comprehend')

def lambda_handler(event, context):
    sentiment=client.detect_sentiment(Text=event['inputTranscript'],LanguageCode='en')['Sentiment']
    if sentiment=='NEGATIVE':
        if escalation_intent_name:
            result = {
                "sessionAttributes": {
                    "sentiment": sentiment
                    },
                    "dialogAction": {
                        "type": "ConfirmIntent", 
                        "message": {
                            "contentType": "PlainText", 
                            "content": ESCALATION_INTENT_MESSAGE
                        }, 
                    "intentName": escalation_intent_name
                    }
            }
        else:
            result = {
                "sessionAttributes": {
                    "sentiment": sentiment
                },
                "dialogAction": {
                    "type": "Close",
                    "fulfillmentState": "Failed",
                    "message": {
                            "contentType": "PlainText",
                            "content": FULFILMENT_CLOSURE_MESSAGE
                    }
                }
            }

    else:
        result ={
            "sessionAttributes": {
                "sentiment": sentiment
            },
            "dialogAction": {
                "type": "Delegate",
                "slots" : event["currentIntent"]["slots"]
            }
        }
    return result
  1. Below the code editor specify the environment variable ESCALATION_INTENT_NAME with a value of Escalate.

  1. Click on Save in the top right of the console.

Now you can test your function.

  1. Click Test at the top of the console.
  2. Configure a new test event using the following test event JSON:
{
  "messageVersion": "1.0",
  "invocationSource": "DialogCodeHook",
  "userId": "1234567890",
  "sessionAttributes": {},
  "bot": {
    "name": "BookSomething",
    "alias": "None",
    "version": "$LATEST"
  },
  "outputDialogMode": "Text",
  "currentIntent": {
    "name": "BookSomething",
    "slots": {
      "slot1": "None",
      "slot2": "None"
    },
    "confirmationStatus": "None"
  },
  "inputTranscript": "I want something"
}
  1. Click Create
  2. Click Test on the console

This message should return a response from Lambda with a sentiment session attribute of NEUTRAL.

However, if you change the input to “This is garbage!”, Lambda changes the dialog action to the escalation intent specified in the environment variable ESCALATION_INTENT_NAME.

Setting up Amazon Lex

Now that you have your Lambda function running, it is time to create the Amazon Lex bot. Use the BookTrip sample bot and call it BookSomething. The IAM role is automatically created on your behalf. Indicate that this bot is not subject to the COPPA, and choose Create. A few minutes later, the bot is ready.

Make the following changes to the default configuration of the bot:

  1. Add an intent with no associated slots. Name it Escalate.
  2. Specify the Lambda function for initialization and validation in the existing two intents (“BookCar” and “BookHotel”), at the same time giving Amazon Lex permission to invoke it.
  3. Leave the other configuration settings as they are and save the intents.

You are ready to build and publish this bot. Set a new alias, BookSomethingWithSentimentAnalysis. When the build finishes, test it.

As you see, sentiment analysis works!

Setting up Amazon Connect

Next, provision an Amazon Connect instance.

After the instance is created, you need to integrate the Amazon Lex bot created in the previous step. For more information, see the Amazon Lex section in the Configuring Your Amazon Connect Instance topic.  You may also want to look at the excellent post by Randall Hunt, New – Amazon Connect and Amazon Lex Integration.

Create a new contact flow, “Sentiment analysis walkthrough”:

  1. Log in into the Amazon Connect instance.
  2. Choose Create contact flow, Create transfer to agent flow.
  3. Add a Get customer input block, open the icon in the top left corner, and specify your Amazon Lex bot and its intents.
  4. Select the Text to speech audio prompt type and enter text for Amazon Connect to play at the beginning of the dialog.
  5. Choose Amazon Lex, enter your Amazon Lex bot name and the alias.
  6. Specify the intents to be used as dialog branches that a customer can choose: BookHotel, BookTrip, or Escalate.
  7. Add two Play prompt blocks and connect them to the customer input block.
    • If booking hotel or car intent is returned from the bot flow, play the corresponding prompt (“OK, will book it for you”) and initiate booking (in this walkthrough, just hang up after the prompt).
    • However, if escalation intent is returned (caused by the sentiment analysis results in the bot), play the prompt (“OK, transferring to an agent”) and initiate the transfer.
  8. Save and publish the contact flow.

As a result, you have a contact flow with a single customer input step and a text-to-speech prompt that uses the Amazon Lex bot. You expect one of the three intents returned:

Edit the phone number to associate the contact flow that you just created. It is now ready for testing. Call the phone number and check how your contact flow works.

Cleanup

Don’t forget to delete all the resources created during this walkthrough to avoid incurring any more costs:

  • Amazon Connect instance
  • Amazon Lex bot
  • Lambda function
  • IAM role LexSentimentAnalysisLambdaRole

Summary

In this walkthrough, you implemented sentiment analysis with a Lambda function. The function can be integrated into Amazon Lex and, as a result, into Amazon Connect. This approach gives you the flexibility to analyze user input and then act. You may find the following potential use cases of this approach to be of interest:

  • Extend the Lambda function to identify “hot” topics in the user input even if the sentiment is not negative and take action proactively. For example, switch to an escalation intent if a user mentioned “where is my order,” which may signal potential frustration.
  • Use Amazon Connect Streams to provide agent sentiment analysis results along with call transfer. Enable service tailored towards particular customer needs and sentiments.
  • Route calls to agents based on both skill set and sentiment.
  • Prioritize calls based on sentiment using multiple Amazon Connect queues instead of transferring directly to an agent.
  • Monitor quality and flag for review contact flows that result in high overall negative sentiment.
  • Implement sentiment and AI/ML based call analysis, such as a real-time recommendation engine. For more details, see Machine Learning on AWS.

If you have questions or suggestions, please comment below.

[$] A new package index for Python

Post Syndicated from jake original https://lwn.net/Articles/751458/rss

The Python Package Index (PyPI) is
the principal repository of libraries for the Python programming language,
serving more than 170 million downloads each week. Fifteen years after PyPI
launched, a new edition is in beta at pypi.org, with features like better
search, a refreshed layout, and Markdown README files
(and with some old
features removed, like viewing GPG package signatures). Starting
April 16, users visiting the site or running pip install will
be
seamlessly redirected to the new site. Two weeks after that, the legacy site is
expected to be shut down and the team will turn toward new
features; in the meantime, it is worth a look at what the new PyPI brings
to the table.

Community profile: Dave Akerman

Post Syndicated from Alex Bate original https://www.raspberrypi.org/blog/community-profile-dave-akerman/

This column is from The MagPi issue 61. You can download a PDF of the full issue for free, or subscribe to receive the print edition through your letterbox or the digital edition on your tablet. All proceeds from the print and digital editions help the Raspberry Pi Foundation achieve our charitable goals.

The pinned tweet on Dave Akerman’s Twitter account shows a table displaying the various components needed for a high-altitude balloon (HAB) flight. Batteries, leads, a camera and Raspberry Pi, plus an unusually themed payload. The caption reads ‘The Queen, The Duke of York, and my TARDIS”, and sums up Dave’s maker career in a heartbeat.

David Akerman on Twitter

The Queen, The Duke of York, and my TARDIS 🙂 #UKHAS #RaspberryPi

Though writing software for industrial automation pays the bills, the majority of Dave’s time is spent in the world of high-altitude ballooning and the ever-growing community that encompasses it. And, while he makes some money sending business-themed balloons to near space for the likes of Aardman Animations, Confused.com, and the BBC, Dave is best known in the Raspberry Pi community for his use of the small computer in every payload, and his work as a tutor alongside the Foundation’s staff at Skycademy events.

Dave Akerman The MagPi Raspberry Pi Community Profile

Dave continues to help others while breaking records and having a good time exploring the atmosphere.

Dave has dedicated many hours and many, many more miles to assist with the Foundation’s Skycademy programme, helping to explore high-altitude ballooning with educators from across the UK. Using a Raspberry Pi and various other pieces of lightweight tech, Dave and Foundation staff member James Robinson explored the incorporation of high-altitude ballooning into education. Through Skycademy, educators were able to learn new skills and take them to the classroom, setting off their own balloons with their students, and recording the results on Raspberry Pis.

Dave Akerman The MagPi Raspberry Pi Community Profile

Dave’s most recent flight broke a new record. On 13 August 2017, his HAB payload was able to send back the highest images taken by any amateur flight.

But education isn’t the only reason for Dave’s involvement in the HAB community. As with anyone passionate about a specific hobby, Dave strives to break records. The most recent record-breaking flight took place on 13 August 2017, when Dave’s Raspberry Pi Zero HAB sent home the highest images taken by any amateur high-altitude balloon launch: at 43014 metres. No other HAB balloon has provided images from such an altitude, and the lightweight nature of the Pi Zero definitely helped, as Dave went on to mention on Twitter a few days later.

Dave Akerman The MagPi Raspberry Pi Community Profile

Dave is recognised as being the first person to incorporate a Raspberry Pi into a HAB payload, and continues to break records with the help of the little green board. More recently, he’s been able to lighten the load by using the Raspberry Pi Zero.

When the first Pi made its way to near space, Dave tore the computer apart in order to meet the weight restriction. The Pi in the Sky board was created to add the extra features needed for the flight. Since then, the HAT has experienced a few changes.

Dave Akerman The MagPi Raspberry Pi Community Profile

The Pi in the Sky board, created specifically for HAB flights.

Dave first fell in love with high-altitude ballooning after coming across the hobby in a video shared on a photographic forum. With a lifelong interest in space thanks to watching the Moon landings as a boy, plus a talent for electronics and photography, it seems a natural progression for him. Throw in his coding skills from learning to program on a Teletype and it’s no wonder he was ready and eager to take to the skies, so to speak, and capture the curvature of the Earth. What was so great about using the Raspberry Pi was the instant gratification he got from receiving images in real time as they were taken during the flight. While other devices could control a camera and store captured images for later retrieval, thanks to the Pi Dave was able to transmit the files back down to Earth and check the progress of his balloon while attempting to break records with a flight.

Dave Akerman The MagPi Raspberry Pi Community Profile Morph

One of the many commercial flights Dave has organised featured the classic children’s TV character Morph, a creation of the Aardman Animations studio known for Wallace and Gromit. Morph took to the sky twice in his mission to reach near space, and finally succeeded in 2016.

High-altitude ballooning isn’t the only part of Dave’s life that incorporates a Raspberry Pi. Having “lost count” of how many Pis he has running tasks, Dave has also created radio receivers for APRS (ham radio data), ADS-B (aircraft tracking), and OGN (gliders), along with a time-lapse camera in his garden, and he has a few more Pi for tinkering purposes.

The post Community profile: Dave Akerman appeared first on Raspberry Pi.

AWS Certificate Manager Launches Private Certificate Authority

Post Syndicated from Randall Hunt original https://aws.amazon.com/blogs/aws/aws-certificate-manager-launches-private-certificate-authority/

Today we’re launching a new feature for AWS Certificate Manager (ACM), Private Certificate Authority (CA). This new service allows ACM to act as a private subordinate CA. Previously, if a customer wanted to use private certificates, they needed specialized infrastructure and security expertise that could be expensive to maintain and operate. ACM Private CA builds on ACM’s existing certificate capabilities to help you easily and securely manage the lifecycle of your private certificates with pay as you go pricing. This enables developers to provision certificates in just a few simple API calls while administrators have a central CA management console and fine grained access control through granular IAM policies. ACM Private CA keys are stored securely in AWS managed hardware security modules (HSMs) that adhere to FIPS 140-2 Level 3 security standards. ACM Private CA automatically maintains certificate revocation lists (CRLs) in Amazon Simple Storage Service (S3) and lets administrators generate audit reports of certificate creation with the API or console. This service is packed full of features so let’s jump in and provision a CA.

Provisioning a Private Certificate Authority (CA)

First, I’ll navigate to the ACM console in my region and select the new Private CAs section in the sidebar. From there I’ll click Get Started to start the CA wizard. For now, I only have the option to provision a subordinate CA so we’ll select that and use my super secure desktop as the root CA and click Next. This isn’t what I would do in a production setting but it will work for testing out our private CA.

Now, I’ll configure the CA with some common details. The most important thing here is the Common Name which I’ll set as secure.internal to represent my internal domain.

Now I need to choose my key algorithm. You should choose the best algorithm for your needs but know that ACM has a limitation today that it can only manage certificates that chain up to to RSA CAs. For now, I’ll go with RSA 2048 bit and click Next.

In this next screen, I’m able to configure my certificate revocation list (CRL). CRLs are essential for notifying clients in the case that a certificate has been compromised before certificate expiration. ACM will maintain the revocation list for me and I have the option of routing my S3 bucket to a custome domain. In this case I’ll create a new S3 bucket to store my CRL in and click Next.

Finally, I’ll review all the details to make sure I didn’t make any typos and click Confirm and create.

A few seconds later and I’m greeted with a fancy screen saying I successfully provisioned a certificate authority. Hooray! I’m not done yet though. I still need to activate my CA by creating a certificate signing request (CSR) and signing that with my root CA. I’ll click Get started to begin that process.

Now I’ll copy the CSR or download it to a server or desktop that has access to my root CA (or potentially another subordinate – so long as it chains to a trusted root for my clients).

Now I can use a tool like openssl to sign my cert and generate the certificate chain.


$openssl ca -config openssl_root.cnf -extensions v3_intermediate_ca -days 3650 -notext -md sha256 -in csr/CSR.pem -out certs/subordinate_cert.pem
Using configuration from openssl_root.cnf
Enter pass phrase for /Users/randhunt/dev/amzn/ca/private/root_private_key.pem:
Check that the request matches the signature
Signature ok
The Subject's Distinguished Name is as follows
stateOrProvinceName   :ASN.1 12:'Washington'
localityName          :ASN.1 12:'Seattle'
organizationName      :ASN.1 12:'Amazon'
organizationalUnitName:ASN.1 12:'Engineering'
commonName            :ASN.1 12:'secure.internal'
Certificate is to be certified until Mar 31 06:05:30 2028 GMT (3650 days)
Sign the certificate? [y/n]:y


1 out of 1 certificate requests certified, commit? [y/n]y
Write out database with 1 new entries
Data Base Updated

After that I’ll copy my subordinate_cert.pem and certificate chain back into the console. and click Next.

Finally, I’ll review all the information and click Confirm and import. I should see a screen like the one below that shows my CA has been activated successfully.

Now that I have a private CA we can provision private certificates by hopping back to the ACM console and creating a new certificate. After clicking create a new certificate I’ll select the radio button Request a private certificate then I’ll click Request a certificate.

From there it’s just similar to provisioning a normal certificate in ACM.

Now I have a private certificate that I can bind to my ELBs, CloudFront Distributions, API Gateways, and more. I can also export the certificate for use on embedded devices or outside of ACM managed environments.

Available Now
ACM Private CA is a service in and of itself and it is packed full of features that won’t fit into a blog post. I strongly encourage the interested readers to go through the developer guide and familiarize themselves with certificate based security. ACM Private CA is available in in US East (N. Virginia), US East (Ohio), US West (Oregon), Asia Pacific (Singapore), Asia Pacific (Sydney), Asia Pacific (Tokyo), Canada (Central), EU (Frankfurt) and EU (Ireland). Private CAs cost $400 per month (prorated) for each private CA. You are not charged for certificates created and maintained in ACM but you are charged for certificates where you have access to the private key (exported or created outside of ACM). The pricing per certificate is tiered starting at $0.75 per certificate for the first 1000 certificates and going down to $0.001 per certificate after 10,000 certificates.

I’m excited to see administrators and developers take advantage of this new service. As always please let us know what you think of this service on Twitter or in the comments below.

Randall

Engineering deep dive: Encoding of SCTs in certificates

Post Syndicated from Let's Encrypt - Free SSL/TLS Certificates original https://letsencrypt.org/2018/04/04/sct-encoding.html

<p>Let&rsquo;s Encrypt recently <a href="https://community.letsencrypt.org/t/signed-certificate-timestamps-embedded-in-certificates/57187">launched SCT embedding in
certificates</a>.
This feature allows browsers to check that a certificate was submitted to a
<a href="https://en.wikipedia.org/wiki/Certificate_Transparency">Certificate Transparency</a>
log. As part of the launch, we did a thorough review
that the encoding of Signed Certificate Timestamps (SCTs) in our certificates
matches the relevant specifications. In this post, I&rsquo;ll dive into the details.
You&rsquo;ll learn more about X.509, ASN.1, DER, and TLS encoding, with references to
the relevant RFCs.</p>

<p>Certificate Transparency offers three ways to deliver SCTs to a browser: In a
TLS extension, in stapled OCSP, or embedded in a certificate. We chose to
implement the embedding method because it would just work for Let&rsquo;s Encrypt
subscribers without additional work. In the SCT embedding method, we submit
a &ldquo;precertificate&rdquo; with a <a href="#poison">poison extension</a> to a set of
CT logs, and get back SCTs. We then issue a real certificate based on the
precertificate, with two changes: The poison extension is removed, and the SCTs
obtained earlier are added in another extension.</p>

<p>Given a certificate, let&rsquo;s first look for the SCT list extension. According to CT (<a href="https://tools.ietf.org/html/rfc6962#section-3.3">RFC 6962
section 3.3</a>),
the extension OID for a list of SCTs is <code>1.3.6.1.4.1.11129.2.4.2</code>. An <a href="http://www.hl7.org/Oid/information.cfm">OID (object
ID)</a> is a series of integers, hierarchically
assigned and globally unique. They are used extensively in X.509, for instance
to uniquely identify extensions.</p>

<p>We can <a href="https://acme-v01.api.letsencrypt.org/acme/cert/031f2484307c9bc511b3123cb236a480d451">download an example certificate</a>,
and view it using OpenSSL (if your OpenSSL is old, it may not display the
detailed information):</p>

<pre><code>$ openssl x509 -noout -text -inform der -in Downloads/031f2484307c9bc511b3123cb236a480d451

CT Precertificate SCTs:
Signed Certificate Timestamp:
Version : v1(0)
Log ID : DB:74:AF:EE:CB:29:EC:B1:FE:CA:3E:71:6D:2C:E5:B9:
AA:BB:36:F7:84:71:83:C7:5D:9D:4F:37:B6:1F:BF:64
Timestamp : Mar 29 18:45:07.993 2018 GMT
Extensions: none
Signature : ecdsa-with-SHA256
30:44:02:20:7E:1F:CD:1E:9A:2B:D2:A5:0A:0C:81:E7:
13:03:3A:07:62:34:0D:A8:F9:1E:F2:7A:48:B3:81:76:
40:15:9C:D3:02:20:65:9F:E9:F1:D8:80:E2:E8:F6:B3:
25:BE:9F:18:95:6D:17:C6:CA:8A:6F:2B:12:CB:0F:55:
FB:70:F7:59:A4:19
Signed Certificate Timestamp:
Version : v1(0)
Log ID : 29:3C:51:96:54:C8:39:65:BA:AA:50:FC:58:07:D4:B7:
6F:BF:58:7A:29:72:DC:A4:C3:0C:F4:E5:45:47:F4:78
Timestamp : Mar 29 18:45:08.010 2018 GMT
Extensions: none
Signature : ecdsa-with-SHA256
30:46:02:21:00:AB:72:F1:E4:D6:22:3E:F8:7F:C6:84:
91:C2:08:D2:9D:4D:57:EB:F4:75:88:BB:75:44:D3:2F:
95:37:E2:CE:C1:02:21:00:8A:FF:C4:0C:C6:C4:E3:B2:
45:78:DA:DE:4F:81:5E:CB:CE:2D:57:A5:79:34:21:19:
A1:E6:5B:C7:E5:E6:9C:E2
</code></pre>

<p>Now let&rsquo;s go a little deeper. How is that extension represented in
the certificate? Certificates are expressed in
<a href="https://en.wikipedia.org/wiki/Abstract_Syntax_Notation_One">ASN.1</a>,
which generally refers to both a language for expressing data structures
and a set of formats for encoding them. The most common format,
<a href="https://en.wikipedia.org/wiki/X.690#DER_encoding">DER</a>,
is a tag-length-value format. That is, to encode an object, first you write
down a tag representing its type (usually one byte), then you write
down a number expressing how long the object is, then you write down
the object contents. This is recursive: An object can contain multiple
objects within it, each of which has its own tag, length, and value.</p>

<p>One of the cool things about DER and other tag-length-value formats is that you
can decode them to some degree without knowing what they mean. For instance, I
can tell you that 0x30 means the data type &ldquo;SEQUENCE&rdquo; (a struct, in ASN.1
terms), and 0x02 means &ldquo;INTEGER&rdquo;, then give you this hex byte sequence to
decode:</p>

<pre><code>30 06 02 01 03 02 01 0A
</code></pre>

<p>You could tell me right away that decodes to:</p>

<pre><code>SEQUENCE
INTEGER 3
INTEGER 10
</code></pre>

<p>Try it yourself with this great <a href="https://lapo.it/asn1js/#300602010302010A">JavaScript ASN.1
decoder</a>. However, you wouldn&rsquo;t know
what those integers represent without the corresponding ASN.1 schema (or
&ldquo;module&rdquo;). For instance, if you knew that this was a piece of DogData, and the
schema was:</p>

<pre><code>DogData ::= SEQUENCE {
legs INTEGER,
cutenessLevel INTEGER
}
</code></pre>

<p>You&rsquo;d know this referred to a three-legged dog with a cuteness level of 10.</p>

<p>We can take some of this knowledge and apply it to our certificates. As a first
step, convert the above certificate to hex with
<code>xxd -ps &lt; Downloads/031f2484307c9bc511b3123cb236a480d451</code>. You can then copy
and paste the result into
<a href="https://lapo.it/asn1js">lapo.it/asn1js</a> (or use <a href="https://lapo.it/asn1js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this handy link</a>). You can also run <code>openssl asn1parse -i -inform der -in Downloads/031f2484307c9bc511b3123cb236a480d451</code> to use OpenSSL&rsquo;s parser, which is less easy to use in some ways, but easier to copy and paste.</p>

<p>In the decoded data, we can find the OID <code>1.3.6.1.4.1.11129.2.4.2</code>, indicating
the SCT list extension. Per <a href="https://tools.ietf.org/html/rfc5280#page-17">RFC 5280, section
4.1</a>, an extension is defined:</p>

<pre><code>Extension ::= SEQUENCE {
extnID OBJECT IDENTIFIER,
critical BOOLEAN DEFAULT FALSE,
extnValue OCTET STRING
— contains the DER encoding of an ASN.1 value
— corresponding to the extension type identified
— by extnID
}
</code></pre>

<p>We&rsquo;ve found the <code>extnID</code>. The &ldquo;critical&rdquo; field is omitted because it has the
default value (false). Next up is the <code>extnValue</code>. This has the type
<code>OCTET STRING</code>, which has the tag &ldquo;0x04&rdquo;. <code>OCTET STRING</code> means &ldquo;here&rsquo;s
a bunch of bytes!&rdquo; In this case, as described by the spec, those bytes
happen to contain more DER. This is a fairly common pattern in X.509
to deal with parameterized data. For instance, this allows defining a
structure for extensions without knowing ahead of time all the structures
that a future extension might want to carry in its value. If you&rsquo;re a C
programmer, think of it as a <code>void*</code> for data structures. If you prefer Go,
think of it as an <code>interface{}</code>.</p>

<p>Here&rsquo;s that <code>extnValue</code>:</p>

<pre><code>04 81 F5 0481F200F0007500DB74AFEECB29ECB1FECA3E716D2CE5B9AABB36F7847183C75D9D4F37B61FBF64000001627313EB19000004030046304402207E1FCD1E9A2BD2A50A0C81E713033A0762340DA8F91EF27A48B3817640159CD30220659FE9F1D880E2E8F6B325BE9F18956D17C6CA8A6F2B12CB0F55FB70F759A419007700293C519654C83965BAAA50FC5807D4B76FBF587A2972DCA4C30CF4E54547F478000001627313EB2A0000040300483046022100AB72F1E4D6223EF87FC68491C208D29D4D57EBF47588BB7544D32F9537E2CEC10221008AFFC40CC6C4E3B24578DADE4F815ECBCE2D57A579342119A1E65BC7E5E69CE2
</code></pre>

<p>That&rsquo;s tag &ldquo;0x04&rdquo;, meaning <code>OCTET STRING</code>, followed by &ldquo;0x81 0xF5&rdquo;, meaning
&ldquo;this string is 245 bytes long&rdquo; (the 0x81 prefix is part of <a href="#variable-length">variable length
number encoding</a>).</p>

<p>According to <a href="https://tools.ietf.org/html/rfc6962#section-3.3">RFC 6962, section
3.3</a>, &ldquo;obtained SCTs
can be directly embedded in the final certificate, by encoding the
SignedCertificateTimestampList structure as an ASN.1 <code>OCTET STRING</code>
and inserting the resulting data in the TBSCertificate as an X.509v3
certificate extension&rdquo;</p>

<p>So, we have an <code>OCTET STRING</code>, all&rsquo;s good, right? Except if you remove the
tag and length from extnValue to get its value, you&rsquo;re left with:</p>

<pre><code>04 81 F2 00F0007500DB74AFEEC…
</code></pre>

<p>There&rsquo;s that &ldquo;0x04&rdquo; tag again, but with a shorter length. Why
do we nest one <code>OCTET STRING</code> inside another? It&rsquo;s because the
contents of extnValue are required by RFC 5280 to be valid DER, but a
SignedCertificateTimestampList is not encoded using DER (more on that
in a minute). So, by RFC 6962, a SignedCertificateTimestampList is wrapped in an
<code>OCTET STRING</code>, which is wrapped in another <code>OCTET STRING</code> (the extnValue).</p>

<p>Once we decode that second <code>OCTET STRING</code>, we&rsquo;re left with the contents:</p>

<pre><code>00F0007500DB74AFEEC…
</code></pre>

<p>&ldquo;0x00&rdquo; isn&rsquo;t a valid tag in DER. What is this? It&rsquo;s TLS encoding. This is
defined in <a href="https://tools.ietf.org/html/rfc5246#section-4">RFC 5246, section 4</a>
(the TLS 1.2 RFC). TLS encoding, like ASN.1, has both a way to define data
structures and a way to encode those structures. TLS encoding differs
from DER in that there are no tags, and lengths are only encoded when necessary for
variable-length arrays. Within an encoded structure, the type of a field is determined by
its position, rather than by a tag. This means that TLS-encoded structures are
more compact than DER structures, but also that they can&rsquo;t be processed without
knowing the corresponding schema. For instance, here&rsquo;s the top-level schema from
<a href="https://tools.ietf.org/html/rfc6962#section-3.3">RFC 6962, section 3.3</a>:</p>

<pre><code> The contents of the ASN.1 OCTET STRING embedded in an OCSP extension
or X509v3 certificate extension are as follows:

opaque SerializedSCT&lt;1..2^16-1&gt;;

struct {
SerializedSCT sct_list &lt;1..2^16-1&gt;;
} SignedCertificateTimestampList;

Here, &quot;SerializedSCT&quot; is an opaque byte string that contains the
serialized TLS structure.
</code></pre>

<p>Right away, we&rsquo;ve found one of those variable-length arrays. The length of such
an array (in bytes) is always represented by a length field just big enough to
hold the max array size. The max size of an <code>sct_list</code> is 65535 bytes, so the
length field is two bytes wide. Sure enough, those first two bytes are &ldquo;0x00
0xF0&rdquo;, or 240 in decimal. In other words, this <code>sct_list</code> will have 240 bytes. We
don&rsquo;t yet know how many SCTs will be in it. That will become clear only by
continuing to parse the encoded data and seeing where each struct ends (spoiler
alert: there are two SCTs!).</p>

<p>Now we know the first SerializedSCT starts with <code>0075…</code>. SerializedSCT
is itself a variable-length field, this time containing <code>opaque</code> bytes (much like <code>OCTET STRING</code>
back in the ASN.1 world). Like SignedCertificateTimestampList, it has a max size
of 65535 bytes, so we pull off the first two bytes and discover that the first
SerializedSCT is 0x0075 (117 decimal) bytes long. Here&rsquo;s the whole thing, in
hex:</p>

<pre><code>00DB74AFEECB29ECB1FECA3E716D2CE5B9AABB36F7847183C75D9D4F37B61FBF64000001627313EB19000004030046304402207E1FCD1E9A2BD2A50A0C81E713033A0762340DA8F91EF27A48B3817640159CD30220659FE9F1D880E2E8F6B325BE9F18956D17C6CA8A6F2B12CB0F55FB70F759A419
</code></pre>

<p>This can be decoded using the TLS encoding struct defined in <a href="https://tools.ietf.org/html/rfc6962#page-13">RFC 6962, section
3.2</a>:</p>

<pre><code>enum { v1(0), (255) }
Version;

struct {
opaque key_id[32];
} LogID;

opaque CtExtensions&lt;0..2^16-1&gt;;

struct {
Version sct_version;
LogID id;
uint64 timestamp;
CtExtensions extensions;
digitally-signed struct {
Version sct_version;
SignatureType signature_type = certificate_timestamp;
uint64 timestamp;
LogEntryType entry_type;
select(entry_type) {
case x509_entry: ASN.1Cert;
case precert_entry: PreCert;
} signed_entry;
CtExtensions extensions;
};
} SignedCertificateTimestamp;
</code></pre>

<p>Breaking that down:</p>

<pre><code># Version sct_version v1(0)
00
# LogID id (aka opaque key_id[32])
DB74AFEECB29ECB1FECA3E716D2CE5B9AABB36F7847183C75D9D4F37B61FBF64
# uint64 timestamp (milliseconds since the epoch)
000001627313EB19
# CtExtensions extensions (zero-length array)
0000
# digitally-signed struct
04030046304402207E1FCD1E9A2BD2A50A0C81E713033A0762340DA8F91EF27A48B3817640159CD30220659FE9F1D880E2E8F6B325BE9F18956D17C6CA8A6F2B12CB0F55FB70F759A419
</code></pre>

<p>To understand the &ldquo;digitally-signed struct,&rdquo; we need to turn back to <a href="https://tools.ietf.org/html/rfc5246#section-4.7">RFC 5246,
section 4.7</a>. It says:</p>

<pre><code>A digitally-signed element is encoded as a struct DigitallySigned:

struct {
SignatureAndHashAlgorithm algorithm;
opaque signature&lt;0..2^16-1&gt;;
} DigitallySigned;
</code></pre>

<p>And in <a href="https://tools.ietf.org/html/rfc5246#section-7.4.1.4.1">section
7.4.1.4.1</a>:</p>

<pre><code>enum {
none(0), md5(1), sha1(2), sha224(3), sha256(4), sha384(5),
sha512(6), (255)
} HashAlgorithm;

enum { anonymous(0), rsa(1), dsa(2), ecdsa(3), (255) }
SignatureAlgorithm;

struct {
HashAlgorithm hash;
SignatureAlgorithm signature;
} SignatureAndHashAlgorithm;
</code></pre>

<p>We have &ldquo;0x0403&rdquo;, which corresponds to sha256(4) and ecdsa(3). The next two
bytes, &ldquo;0x0046&rdquo;, tell us the length of the &ldquo;opaque signature&rdquo; field, 70 bytes in
decimal. To decode the signature, we reference <a href="https://tools.ietf.org/html/rfc4492#page-20">RFC 4492 section
5.4</a>, which says:</p>

<pre><code>The digitally-signed element is encoded as an opaque vector &lt;0..2^16-1&gt;, the
contents of which are the DER encoding corresponding to the
following ASN.1 notation.

Ecdsa-Sig-Value ::= SEQUENCE {
r INTEGER,
s INTEGER
}
</code></pre>

<p>Having dived through two layers of TLS encoding, we are now back in ASN.1 land!
We
<a href="https://lapo.it/asn1js/#304402207E1FCD1E9A2BD2A50A0C81E713033A0762340DA8F91EF27A48B3817640159CD30220659FE9F1D880E2E8F6B325BE9F18956D17C6CA8A6F2B12CB0F55FB70F759A419">decode</a>
the remaining bytes into a SEQUENCE containing two INTEGERS. And we&rsquo;re done! Here&rsquo;s the whole
extension decoded:</p>

<pre><code># Extension SEQUENCE – RFC 5280
30
# length 0x0104 bytes (260 decimal)
820104
# OBJECT IDENTIFIER
06
# length 0x0A bytes (10 decimal)
0A
# value (1.3.6.1.4.1.11129.2.4.2)
2B06010401D679020402
# OCTET STRING
04
# length 0xF5 bytes (245 decimal)
81F5
# OCTET STRING (embedded) – RFC 6962
04
# length 0xF2 bytes (242 decimal)
81F2
# Beginning of TLS encoded SignedCertificateTimestampList – RFC 5246 / 6962
# length 0xF0 bytes
00F0
# opaque SerializedSCT&lt;1..2^16-1&gt;
# length 0x75 bytes
0075
# Version sct_version v1(0)
00
# LogID id (aka opaque key_id[32])
DB74AFEECB29ECB1FECA3E716D2CE5B9AABB36F7847183C75D9D4F37B61FBF64
# uint64 timestamp (milliseconds since the epoch)
000001627313EB19
# CtExtensions extensions (zero-length array)
0000
# digitally-signed struct – RFC 5426
# SignatureAndHashAlgorithm (ecdsa-sha256)
0403
# opaque signature&lt;0..2^16-1&gt;;
# length 0x0046
0046
# DER-encoded Ecdsa-Sig-Value – RFC 4492
30 # SEQUENCE
44 # length 0x44 bytes
02 # r INTEGER
20 # length 0x20 bytes
# value
7E1FCD1E9A2BD2A50A0C81E713033A0762340DA8F91EF27A48B3817640159CD3
02 # s INTEGER
20 # length 0x20 bytes
# value
659FE9F1D880E2E8F6B325BE9F18956D17C6CA8A6F2B12CB0F55FB70F759A419
# opaque SerializedSCT&lt;1..2^16-1&gt;
# length 0x77 bytes
0077
# Version sct_version v1(0)
00
# LogID id (aka opaque key_id[32])
293C519654C83965BAAA50FC5807D4B76FBF587A2972DCA4C30CF4E54547F478
# uint64 timestamp (milliseconds since the epoch)
000001627313EB2A
# CtExtensions extensions (zero-length array)
0000
# digitally-signed struct – RFC 5426
# SignatureAndHashAlgorithm (ecdsa-sha256)
0403
# opaque signature&lt;0..2^16-1&gt;;
# length 0x0048
0048
# DER-encoded Ecdsa-Sig-Value – RFC 4492
30 # SEQUENCE
46 # length 0x46 bytes
02 # r INTEGER
21 # length 0x21 bytes
# value
00AB72F1E4D6223EF87FC68491C208D29D4D57EBF47588BB7544D32F9537E2CEC1
02 # s INTEGER
21 # length 0x21 bytes
# value
008AFFC40CC6C4E3B24578DADE4F815ECBCE2D57A579342119A1E65BC7E5E69CE2
</code></pre>

<p>One surprising thing you might notice: In the first SCT, <code>r</code> and <code>s</code> are twenty
bytes long. In the second SCT, they are both twenty-one bytes long, and have a
leading zero. Integers in DER are two&rsquo;s complement, so if the leftmost bit is
set, they are interpreted as negative. Since <code>r</code> and <code>s</code> are positive, if the
leftmost bit would be a 1, an extra byte has to be added so that the leftmost
bit can be 0.</p>

<p>This is a little taste of what goes into encoding a certificate. I hope it was
informative! If you&rsquo;d like to learn more, I recommend &ldquo;<a href="http://luca.ntop.org/Teaching/Appunti/asn1.html">A Layman&rsquo;s Guide to a
Subset of ASN.1, BER, and DER</a>.&rdquo;</p>

<p><a name="poison"></a>Footnote 1: A &ldquo;poison extension&rdquo; is defined by <a href="https://tools.ietf.org/html/rfc6962#section-3.1">RFC 6962
section 3.1</a>:</p>

<pre><code>The Precertificate is constructed from the certificate to be issued by adding a special
critical poison extension (OID `1.3.6.1.4.1.11129.2.4.3`, whose
extnValue OCTET STRING contains ASN.1 NULL data (0x05 0x00))
</code></pre>

<p>In other words, it&rsquo;s an empty extension whose only purpose is to ensure that
certificate processors will not accept precertificates as valid certificates. The
specification ensures this by setting the &ldquo;critical&rdquo; bit on the extension, which
ensures that code that doesn&rsquo;t recognize the extension will reject the whole
certificate. Code that does recognize the extension specifically as poison
will also reject the certificate.</p>

<p><a name="variable-length"></a>Footnote 2: Lengths from 0-127 are represented by
a single byte (short form). To express longer lengths, more bytes are used (long form).
The high bit (0x80) on the first byte is set to distinguish long form from short
form. The remaining bits are used to express how many more bytes to read for the
length. For instance, 0x81F5 means &ldquo;this is long form because the length is
greater than 127, but there&rsquo;s still only one byte of length (0xF5) to decode.&rdquo;</p>

Build a solar-powered nature camera for your garden

Post Syndicated from Alex Bate original https://www.raspberrypi.org/blog/solar-powered-nature-camera/

Spring has sprung, and with it, sleepy-eyed wildlife is beginning to roam our gardens and local woodlands. So why not follow hackster.io maker reichley’s tutorial and build your own solar-powered squirrelhouse nature cam?

Raspberry Pi- and solar-powered nature camera

Inspiration

“I live half a mile above sea level and am SURROUNDED by animals…bears, foxes, turkeys, deer, squirrels, birds”, reichley explains in his tutorial. “Spring has arrived, and there are LOADS of squirrels running around. I was in the building mood and, being a nerd, wished to combine a common woodworking project with the connectivity and observability provided by single-board computers (and their camera add-ons).”

Building a tiny home

reichley started by sketching out a design for the house to determine where the various components would fit.

Raspberry Pi- and solar-powered nature camera

Since he’s fan of autonomy and renewable energy, he decided to run the project’s Raspberry Pi Zero W via solar power. To do so, he reiterated the design to include the necessary tech, scaling the roof to fit the panels.

Raspberry Pi- and solar-powered squirrel cam
Raspberry Pi- and solar-powered squirrel cam
Raspberry Pi- and solar-powered squirrel cam

To keep the project running 24/7, reichley had to figure out the overall power consumption of both the Zero W and the Raspberry Pi Camera Module, factoring in the constant WiFi connection and the sunshine hours in his garden.

Raspberry Pi- and solar-powered nature camera

He used a LiPo SHIM to bump up the power to the required 5V for the Zero. Moreover, he added a BH1750 lux sensor to shut off the LiPo SHIM, and thus the Pi, whenever it’s too dark for decent video.

Raspberry Pi- and solar-powered nature camera

To control the project, he used Calin Crisan’s motionEyeOS video surveillance operating system for single-board computers.

Build your own nature camera

To build your own version, follow reichley’s tutorial, in which you can also find links to all the necessary code and components. You can also check out our free tutorial for building an infrared bird box using the Raspberry Pi NoIR Camera Module. As Eben said in our YouTube live Q&A last week, we really like nature cameras here at Pi Towers, and we’d love to see yours. So if you have any live-stream links or photography from your Raspberry Pi–powered nature cam, please share them with us!

The post Build a solar-powered nature camera for your garden appeared first on Raspberry Pi.

Node.js 8.10 runtime now available in AWS Lambda

Post Syndicated from Chris Munns original https://aws.amazon.com/blogs/compute/node-js-8-10-runtime-now-available-in-aws-lambda/

This post courtesy of Ed Lima, AWS Solutions Architect

We are excited to announce that you can now develop your AWS Lambda functions using the Node.js 8.10 runtime, which is the current Long Term Support (LTS) version of Node.js. Start using this new version today by specifying a runtime parameter value of nodejs8.10 when creating or updating functions.

Supporting async/await

The Lambda programming model for Node.js 8.10 now supports defining a function handler using the async/await pattern.

Asynchronous or non-blocking calls are an inherent and important part of applications, as user and human interfaces are asynchronous by nature. If you decide to have a coffee with a friend, you usually order the coffee then start or continue a conversation with your friend while the coffee is getting ready. You don’t wait for the coffee to be ready before you start talking. These activities are asynchronous, because you can start one and then move to the next without waiting for completion. Otherwise, you’d delay (or block) the start of the next activity.

Asynchronous calls used to be handled in Node.js using callbacks. That presented problems when they were nested within other callbacks in multiple levels, making the code difficult to maintain and understand.

Promises were implemented to try to solve issues caused by “callback hell.” They allow asynchronous operations to call their own methods and handle what happens when a call is successful or when it fails. As your requirements become more complicated, even promises become harder to work with and may still end up complicating your code.

Async/await is the new way of handling asynchronous operations in Node.js, and makes for simpler, easier, and cleaner code for non-blocking calls. It still uses promises but a callback is returned directly from the asynchronous function, just as if it were a synchronous blocking function.

Take for instance the following Lambda function to get the current account settings, using the Node.js 6.10 runtime:

let AWS = require('aws-sdk');
let lambda = new AWS.Lambda();

exports.handler = (event, context, callback) => {
    let getAccountSettingsPromise = lambda.getAccountSettings().promise();
    getAccountSettingsPromise.then(
        (data) => {
            callback(null, data);
        },
        (err) => {
            console.log(err);
            callback(err);
        }
    );
};

With the new Node.js 8.10 runtime, there are new handler types that can be declared with the “async” keyword or can return a promise directly.

This is how the same function looks like using async/await with Node.js 8.10:

let AWS = require('aws-sdk');
let lambda = new AWS.Lambda();

exports.handler = async (event) => {
    return await lambda.getAccountSettings().promise() ;
};

Alternatively, you could have the handler return a promise directly:

let AWS = require('aws-sdk');
let lambda = new AWS.Lambda();

exports.handler = (event) => {
    return new Promise((resolve, reject) => {
        lambda.getAccountSettings(event)
        .then((data) => {
            resolve data;
        })
        .catch(reject);
     });
};

The new handler types are alternatives to the callback pattern, which is still fully supported.

All three functions return the same results. However, in the new runtime with async/await, all callbacks in the code are gone, which makes it easier to read. This is especially true for those less familiar with promises.

{
    "AccountLimit":{
        "TotalCodeSize":80530636800,
        "CodeSizeUnzipped":262144000,
        "CodeSizeZipped":52428800, 
        "ConcurrentExecutions":1000,
        "UnreservedConcurrentExecutions":1000
    },
    "AccountUsage":{
        "TotalCodeSize":52234461,
        "FunctionCount":53
    }
}

Another great advantage of async/await is better error handling. You can use a try/catch block inside the scope of an async function. Even though the function awaits an asynchronous operation, any errors end up in the catch block.

You can improve your previous Node.js 8.10 function with this trusted try/catch error handling pattern:

let AWS = require('aws-sdk');
let lambda = new AWS.Lambda();
let data;

exports.handler = async (event) => {
    try {
        data = await lambda.getAccountSettings().promise();
    }
    catch (err) {
        console.log(err);
        return err;
    }
    return data;
};

While you now have a similar number of lines in both runtimes, the code is cleaner and more readable with async/await. It makes the asynchronous calls look more synchronous. However, it is important to notice that the code is still executed the same way as if it were using a callback or promise-based API.

Backward compatibility

You may port your existing Node.js 4.3 and 6.10 functions over to Node.js 8.10 by updating the runtime. Node.js 8.10 does include numerous breaking changes from previous Node versions.

Make sure to review the API changes between Node.js 4.3, 6.10, and Node.js 8.10 to see if there are other changes that might affect your code. We recommend testing that your Lambda function passes internal validation for its behavior when upgrading to the new runtime version.

You can use Lambda versions/aliases to safely test that your function runs as expected on Node 8.10, before routing production traffic to it.

New node features

You can now get better performance when compared to the previous LTS version 6.x (up to 20%). The new V8 6.0 engine comes with Turbofan and the Ignition pipeline, which leads to lower memory consumption and faster startup time across Node.js applications.

HTTP/2, which is subject to future changes, allows developers to use the new protocol to speed application development and undo many of HTTP/1.1 workarounds to make applications faster, simpler, and more powerful.

For more information, see the AWS Lambda Developer Guide.

Hope you enjoy and… go build with Node.js 8.10!

A geometric Rust adventure

Post Syndicated from Eevee original https://eev.ee/blog/2018/03/30/a-geometric-rust-adventure/

Hi. Yes. Sorry. I’ve been trying to write this post for ages, but I’ve also been working on a huge writing project, and apparently I have a very limited amount of writing mana at my disposal. I think this is supposed to be a Patreon reward from January. My bad. I hope it’s super great to make up for the wait!

I recently ported some math code from C++ to Rust in an attempt to do a cool thing with Doom. Here is my story.

The problem

I presented it recently as a conundrum (spoilers: I solved it!), but most of those details are unimportant.

The short version is: I have some shapes. I want to find their intersection.

Really, I want more than that: I want to drop them all on a canvas, intersect everything with everything, and pluck out all the resulting polygons. The input is a set of cookie cutters, and I want to press them all down on the same sheet of dough and figure out what all the resulting contiguous pieces are. And I want to know which cookie cutter(s) each piece came from.

But intersection is a good start.

Example of the goal.  Given two squares that overlap at their corners, I want to find the small overlap piece, plus the two L-shaped pieces left over from each square

I’m carefully referring to the input as shapes rather than polygons, because each one could be a completely arbitrary collection of lines. Obviously there’s not much you can do with shapes that aren’t even closed, but at the very least, I need to handle concavity and multiple disconnected polygons that together are considered a single input.

This is a non-trivial problem with a lot of edge cases, and offhand I don’t know how to solve it robustly. I’m not too eager to go figure it out from scratch, so I went hunting for something I could build from.

(Infuriatingly enough, I can just dump all the shapes out in an SVG file and any SVG viewer can immediately solve the problem, but that doesn’t quite help me. Though I have had a few people suggest I just rasterize the whole damn problem, and after all this, I’m starting to think they may have a point.)

Alas, I couldn’t find a Rust library for doing this. I had a hard time finding any library for doing this that wasn’t a massive fully-featured geometry engine. (I could’ve used that, but I wanted to avoid non-Rust dependencies if possible, since distributing software is already enough of a nightmare.)

A Twitter follower directed me towards a paper that described how to do very nearly what I wanted and nothing else: “A simple algorithm for Boolean operations on polygons” by F. Martínez (2013). Being an academic paper, it’s trapped in paywall hell; sorry about that. (And as I understand it, none of the money you’d pay to get the paper would even go to the authors? Is that right? What a horrible and predatory system for discovering and disseminating knowledge.)

The paper isn’t especially long, but it does describe an awful lot of subtle details and is mostly written in terms of its own reference implementation. Rather than write my own implementation based solely on the paper, I decided to try porting the reference implementation from C++ to Rust.

And so I fell down the rabbit hole.

The basic algorithm

Thankfully, the author has published the sample code on his own website, if you want to follow along. (It’s the bottom link; the same author has, confusingly, published two papers on the same topic with similar titles, four years apart.)

If not, let me describe the algorithm and how the code is generally laid out. The algorithm itself is based on a sweep line, where a vertical line passes across the plane and ✨ does stuff ✨ as it encounters various objects. This implementation has no physical line; instead, it keeps track of which segments from the original polygon would be intersecting the sweep line, which is all we really care about.

A vertical line is passing rightwards over a couple intersecting shapes.  The line current intersects two of the shapes' sides, and these two sides are the "sweep list"

The code is all bundled inside a class with only a single public method, run, because… that’s… more object-oriented, I guess. There are several helper methods, and state is stored in some attributes. A rough outline of run is:

  1. Run through all the line segments in both input polygons. For each one, generate two SweepEvents (one for each endpoint) and add them to a std::deque for storage.

    Add pointers to the two SweepEvents to a std::priority_queue, the event queue. This queue uses a custom comparator to order the events from left to right, so the top element is always the leftmost endpoint.

  2. Loop over the event queue (where an “event” means the sweep line passed over the left or right end of a segment). Encountering a left endpoint means the sweep line is newly touching that segment, so add it to a std::set called the sweep list. An important point is that std::set is ordered, and the sweep list uses a comparator that keeps segments in order vertically.

    Encountering a right endpoint means the sweep line is leaving a segment, so that segment is removed from the sweep list.

  3. When a segment is added to the sweep list, it may have up to two neighbors: the segment above it and the segment below it. Call possibleIntersection to check whether it intersects either of those neighbors. (This is nearly sufficient to find all intersections, which is neat.)

  4. If possibleIntersection detects an intersection, it will split each segment into two pieces then and there. The old segment is shortened in-place to become the left part, and a new segment is created for the right part. The new endpoints at the point of intersection are added to the event queue.

  5. Some bookkeeping is done along the way to track which original polygons each segment is inside, and eventually the segments are reconstructed into new polygons.

Hopefully that’s enough to follow along. It took me an inordinately long time to tease this out. The comments aren’t especially helpful.

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    std::deque<SweepEvent> eventHolder;    // It holds the events generated during the computation of the boolean operation

Syntax and basic semantics

The first step was to get something that rustc could at least parse, which meant translating C++ syntax to Rust syntax.

This was surprisingly straightforward! C++ classes become Rust structs. (There was no inheritance here, thankfully.) All the method declarations go away. Method implementations only need to be indented and wrapped in impl.

I did encounter some unnecessarily obtuse uses of the ternary operator:

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(prevprev != sl.begin()) ? --prevprev : prevprev = sl.end();

Rust doesn’t have a ternary — you can use a regular if block as an expression — so I expanded these out.

C++ switch blocks become Rust match blocks, but otherwise function basically the same. Rust’s enums are scoped (hallelujah), so I had to explicitly spell out where enum values came from.

The only really annoying part was changing function signatures; C++ types don’t look much at all like Rust types, save for the use of angle brackets. Rust also doesn’t pass by implicit reference, so I needed to sprinkle a few &s around.

I would’ve had a much harder time here if this code had relied on any remotely esoteric C++ functionality, but thankfully it stuck to pretty vanilla features.

Language conventions

This is a geometry problem, so the sample code unsurprisingly has its own home-grown point type. Rather than port that type to Rust, I opted to use the popular euclid crate. Not only is it code I didn’t have to write, but it already does several things that the C++ code was doing by hand inline, like dot products and cross products. And all I had to do was add one line to Cargo.toml to use it! I have no idea how anyone writes C or C++ without a package manager.

The C++ code used getters, i.e. point.x (). I’m not a huge fan of getters, though I do still appreciate the need for them in lowish-level systems languages where you want to future-proof your API and the language wants to keep a clear distinction between attribute access and method calls. But this is a point, which is nothing more than two of the same numeric type glued together; what possible future logic might you add to an accessor? The euclid authors appear to side with me and leave the coordinates as public fields, so I took great joy in removing all the superfluous parentheses.

Polygons are represented with a Polygon class, which has some number of Contours. A contour is a single contiguous loop. Something you’d usually think of as a polygon would only have one, but a shape with a hole would have two: one for the outside, one for the inside. The weird part of this arrangement was that Polygon implemented nearly the entire STL container interface, then waffled between using it and not using it throughout the rest of the code. Rust lets anything in the same module access non-public fields, so I just skipped all that and used polygon.contours directly. Hell, I think I made contours public.

Finally, the SweepEvent type has a pol field that’s declared as an enum PolygonType (either SUBJECT or CLIPPING, to indicate which of the two inputs it is), but then some other code uses the same field as a numeric index into a polygon’s contours. Boy I sure do love static typing where everything’s a goddamn integer. I wanted to extend the algorithm to work on arbitrarily many input polygons anyway, so I scrapped the enum and this became a usize.


Then I got to all the uses of STL. I have only a passing familiarity with the C++ standard library, and this code actually made modest use of it, which caused some fun days-long misunderstandings.

As mentioned, the SweepEvents are stored in a std::deque, which is never read from. It took me a little thinking to realize that the deque was being used as an arena: it’s the canonical home for the structs so pointers to them can be tossed around freely. (It can’t be a std::vector, because that could reallocate and invalidate all the pointers; std::deque is probably a doubly-linked list, and guarantees no reallocation.)

Rust’s standard library does have a doubly-linked list type, but I knew I’d run into ownership hell here later anyway, so I think I replaced it with a Rust Vec to start with. It won’t compile either way, so whatever. We’ll get back to this in a moment.

The list of segments currently intersecting the sweep line is stored in a std::set. That type is explicitly ordered, which I’m very glad I knew already. Rust has two set types, HashSet and BTreeSet; unsurprisingly, the former is unordered and the latter is ordered. Dropping in BTreeSet and fixing some method names got me 90% of the way there.

Which brought me to the other 90%. See, the C++ code also relies on finding nodes adjacent to the node that was just inserted, via STL iterators.

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next = prev = se->posSL = it = sl.insert(se).first;
(prev != sl.begin()) ? --prev : prev = sl.end();
++next;

I freely admit I’m bad at C++, but this seems like something that could’ve used… I don’t know, 1 comment. Or variable names more than two letters long. What it actually does is:

  1. Add the current sweep event (se) to the sweep list (sl), which returns a pair whose first element is an iterator pointing at the just-inserted event.

  2. Copies that iterator to several other variables, including prev and next.

  3. If the event was inserted at the beginning of the sweep list, set prev to the sweep list’s end iterator, which in C++ is a legal-but-invalid iterator meaning “the space after the end” or something. This is checked for in later code, to see if there is a previous event to look at. Otherwise, decrement prev, so it’s now pointing at the event immediately before the inserted one.

  4. Increment next normally. If the inserted event is last, then this will bump next to the end iterator anyway.

In other words, I need to get the previous and next elements from a BTreeSet. Rust does have bidirectional iterators, which BTreeSet supports… but BTreeSet::insert only returns a bool telling me whether or not anything was inserted, not the position. I came up with this:

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let mut maybe_below = active_segments.range(..segment).last().map(|v| *v);
let mut maybe_above = active_segments.range(segment..).next().map(|v| *v);
active_segments.insert(segment);

The range method returns an iterator over a subset of the tree. The .. syntax makes a range (where the right endpoint is exclusive), so ..segment finds the part of the tree before the new segment, and segment.. finds the part of the tree after it. (The latter would start with the segment itself, except I haven’t inserted it yet, so it’s not actually there.)

Then the standard next() and last() methods on bidirectional iterators find me the element I actually want. But the iterator might be empty, so they both return an Option. Also, iterators tend to return references to their contents, but in this case the contents are already references, and I don’t want a double reference, so the map call dereferences one layer — but only if the Option contains a value. Phew!

This is slightly less efficient than the C++ code, since it has to look up where segment goes three times rather than just one. I might be able to get it down to two with some more clever finagling of the iterator, but microsopic performance considerations were a low priority here.

Finally, the event queue uses a std::priority_queue to keep events in a desired order and efficiently pop the next one off the top.

Except priority queues act like heaps, where the greatest (i.e., last) item is made accessible.

Sorting out sorting

C++ comparison functions return true to indicate that the first argument is less than the second argument. Sweep events occur from left to right. You generally implement sorts so that the first thing comes, erm, first.

But sweep events go in a priority queue, and priority queues surface the last item, not the first. This C++ code handled this minor wrinkle by implementing its comparison backwards.

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struct SweepEventComp : public std::binary_function<SweepEvent, SweepEvent, bool> { // for sorting sweep events
// Compare two sweep events
// Return true means that e1 is placed at the event queue after e2, i.e,, e1 is processed by the algorithm after e2
bool operator() (const SweepEvent* e1, const SweepEvent* e2)
{
    if (e1->point.x () > e2->point.x ()) // Different x-coordinate
        return true;
    if (e2->point.x () > e1->point.x ()) // Different x-coordinate
        return false;
    if (e1->point.y () != e2->point.y ()) // Different points, but same x-coordinate. The event with lower y-coordinate is processed first
        return e1->point.y () > e2->point.y ();
    if (e1->left != e2->left) // Same point, but one is a left endpoint and the other a right endpoint. The right endpoint is processed first
        return e1->left;
    // Same point, both events are left endpoints or both are right endpoints.
    if (signedArea (e1->point, e1->otherEvent->point, e2->otherEvent->point) != 0) // not collinear
        return e1->above (e2->otherEvent->point); // the event associate to the bottom segment is processed first
    return e1->pol > e2->pol;
}
};

Maybe it’s just me, but I had a hell of a time just figuring out what problem this was even trying to solve. I still have to reread it several times whenever I look at it, to make sure I’m getting the right things backwards.

Making this even more ridiculous is that there’s a second implementation of this same sort, with the same name, in another file — and that one’s implemented forwards. And doesn’t use a tiebreaker. I don’t entirely understand how this even compiles, but it does!

I painstakingly translated this forwards to Rust. Unlike the STL, Rust doesn’t take custom comparators for its containers, so I had to implement ordering on the types themselves (which makes sense, anyway). I wrapped everything in the priority queue in a Reverse, which does what it sounds like.

I’m fairly pleased with Rust’s ordering model. Most of the work is done in Ord, a trait with a cmp() method returning an Ordering (one of Less, Equal, and Greater). No magic numbers, no need to implement all six ordering methods! It’s incredible. Ordering even has some handy methods on it, so the usual case of “order by this, then by this” can be written as:

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return self.point().x.cmp(&other.point().x)
    .then(self.point().y.cmp(&other.point().y));

Well. Just kidding! It’s not quite that easy. You see, the points here are composed of floats, and floats have the fun property that not all of them are comparable. Specifically, NaN is not less than, greater than, or equal to anything else, including itself. So IEEE 754 float ordering cannot be expressed with Ord. Unless you want to just make up an answer for NaN, but Rust doesn’t tend to do that.

Rust’s float types thus implement the weaker PartialOrd, whose method returns an Option<Ordering> instead. That makes the above example slightly uglier:

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2
return self.point().x.partial_cmp(&other.point().x).unwrap()
    .then(self.point().y.partial_cmp(&other.point().y).unwrap())

Also, since I use unwrap() here, this code will panic and take the whole program down if the points are infinite or NaN. Don’t do that.

This caused some minor inconveniences in other places; for example, the general-purpose cmp::min() doesn’t work on floats, because it requires an Ord-erable type. Thankfully there’s a f64::min(), which handles a NaN by returning the other argument.

(Cool story: for the longest time I had this code using f32s. I’m used to translating int to “32 bits”, and apparently that instinct kicked in for floats as well, even floats spelled double.)

The only other sorting adventure was this:

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// Due to overlapping edges the resultEvents array can be not wholly sorted
bool sorted = false;
while (!sorted) {
    sorted = true;
    for (unsigned int i = 0; i < resultEvents.size (); ++i) {
        if (i + 1 < resultEvents.size () && sec (resultEvents[i], resultEvents[i+1])) {
            std::swap (resultEvents[i], resultEvents[i+1]);
            sorted = false;
        }
    }
}

(I originally misread this comment as saying “the array cannot be wholly sorted” and had no idea why that would be the case, or why the author would then immediately attempt to bubble sort it.)

I’m still not sure why this uses an ad-hoc sort instead of std::sort. But I’m used to taking for granted that general-purpose sorting implementations are tuned to work well for almost-sorted data, like Python’s. Maybe C++ is untrustworthy here, for some reason. I replaced it with a call to .sort() and all seemed fine.

Phew! We’re getting there. Finally, my code appears to type-check.

But now I see storm clouds gathering on the horizon.

Ownership hell

I have a problem. I somehow run into this problem every single time I use Rust. The solutions are never especially satisfying, and all the hacks I might use if forced to write C++ turn out to be unsound, which is even more annoying because rustc is just sitting there with this smug “I told you so expression” and—

The problem is ownership, which Rust is fundamentally built on. Any given value must have exactly one owner, and Rust must be able to statically convince itself that:

  1. No reference to a value outlives that value.
  2. If a mutable reference to a value exists, no other references to that value exist at the same time.

This is the core of Rust. It guarantees at compile time that you cannot lose pointers to allocated memory, you cannot double-free, you cannot have dangling pointers.

It also completely thwarts a lot of approaches you might be inclined to take if you come from managed languages (where who cares, the GC will take care of it) or C++ (where you just throw pointers everywhere and hope for the best apparently).

For example, pointer loops are impossible. Rust’s understanding of ownership and lifetimes is hierarchical, and it simply cannot express loops. (Rust’s own doubly-linked list type uses raw pointers and unsafe code under the hood, where “unsafe” is an escape hatch for the usual ownership rules. Since I only recently realized that pointers to the inside of a mutable Vec are a bad idea, I figure I should probably not be writing unsafe code myself.)

This throws a few wrenches in the works.

Problem the first: pointer loops

I immediately ran into trouble with the SweepEvent struct itself. A SweepEvent pulls double duty: it represents one endpoint of a segment, but each left endpoint also handles bookkeeping for the segment itself — which means that most of the fields on a right endpoint are unused. Also, and more importantly, each SweepEvent has a pointer to the corresponding SweepEvent at the other end of the same segment. So a pair of SweepEvents point to each other.

Rust frowns upon this. In retrospect, I think I could’ve kept it working, but I also think I’m wrong about that.

My first step was to wrench SweepEvent apart. I moved all of the segment-stuff (which is virtually all of it) into a single SweepSegment type, and then populated the event queue with a SweepEndpoint tuple struct, similar to:

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enum SegmentEnd {
    Left,
    Right,
}

struct SweepEndpoint<'a>(&'a SweepSegment, SegmentEnd);

This makes SweepEndpoint essentially a tuple with a name. The 'a is a lifetime and says, more or less, that a SweepEndpoint cannot outlive the SweepSegment it references. Makes sense.

Problem solved! I no longer have mutually referential pointers. But I do still have pointers (well, references), and they have to point to something.

Problem the second: where’s all the data

Which brings me to the problem I always run into with Rust. I have a bucket of things, and I need to refer to some of them multiple times.

I tried half a dozen different approaches here and don’t clearly remember all of them, but I think my core problem went as follows. I translated the C++ class to a Rust struct with some methods hanging off of it. A simplified version might look like this.

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struct Algorithm {
    arena: LinkedList<SweepSegment>,
    event_queue: BinaryHeap<SweepEndpoint>,
}

Ah, hang on — SweepEndpoint needs to be annotated with a lifetime, so Rust can enforce that those endpoints don’t live longer than the segments they refer to. No problem?

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struct Algorithm<'a> {
    arena: LinkedList<SweepSegment>,
    event_queue: BinaryHeap<SweepEndpoint<'a>>,
}

Okay! Now for some methods.

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fn run(&mut self) {
    self.arena.push_back(SweepSegment{ data: 5 });
    self.event_queue.push(SweepEndpoint(self.arena.back().unwrap(), SegmentEnd::Left));
    self.event_queue.push(SweepEndpoint(self.arena.back().unwrap(), SegmentEnd::Right));
    for event in &self.event_queue {
        println!("{:?}", event)
    }
}

Aaand… this doesn’t work. Rust “cannot infer an appropriate lifetime for autoref due to conflicting requirements”. The trouble is that self.arena.back() takes a reference to self.arena, and then I put that reference in the event queue. But I promised that everything in the event queue has lifetime 'a, and I don’t actually know how long self lives here; I only know that it can’t outlive 'a, because that would invalidate the references it holds.

A little random guessing let me to change &mut self to &'a mut self — which is fine because the entire impl block this lives in is already parameterized by 'a — and that makes this compile! Hooray! I think that’s because I’m saying self itself has exactly the same lifetime as the references it holds onto, which is true, since it’s referring to itself.

Let’s get a little more ambitious and try having two segments.

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fn run(&'a mut self) {
    self.arena.push_back(SweepSegment{ data: 5 });
    self.event_queue.push(SweepEndpoint(self.arena.back().unwrap(), SegmentEnd::Left));
    self.event_queue.push(SweepEndpoint(self.arena.back().unwrap(), SegmentEnd::Right));
    self.arena.push_back(SweepSegment{ data: 17 });
    self.event_queue.push(SweepEndpoint(self.arena.back().unwrap(), SegmentEnd::Left));
    self.event_queue.push(SweepEndpoint(self.arena.back().unwrap(), SegmentEnd::Right));
    for event in &self.event_queue {
        println!("{:?}", event)
    }
}

Whoops! Rust complains that I’m trying to mutate self.arena while other stuff is referring to it. And, yes, that’s true — I have references to it in the event queue, and Rust is preventing me from potentially deleting everything from the queue when references to it still exist. I’m not actually deleting anything here, of course (though I could be if this were a Vec!), but Rust’s type system can’t encode that (and I dread the thought of a type system that can).

I struggled with this for a while, and rapidly encountered another complete showstopper:

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fn run(&'a mut self) {
    self.mutate_something();
    self.mutate_something();
}

fn mutate_something(&'a mut self) {}

Rust objects that I’m trying to borrow self mutably, twice — once for the first call, once for the second.

But why? A borrow is supposed to end automatically once it’s no longer used, right? Maybe if I throw some braces around it for scope… nope, that doesn’t help either.

It’s true that borrows usually end automatically, but here I have explicitly told Rust that mutate_something() should borrow with the lifetime 'a, which is the same as the lifetime in run(). So the first call explicitly borrows self for at least the rest of the method. Removing the lifetime from mutate_something() does fix this error, but if that method tries to add new segments, I’m back to the original problem.

Oh no. The mutation in the C++ code is several calls deep. Porting it directly seems nearly impossible.

The typical solution here — at least, the first thing people suggest to me on Twitter — is to wrap basically everything everywhere in Rc<RefCell<T>>, which gives you something that’s reference-counted (avoiding questions of ownership) and defers borrow checks until runtime (avoiding questions of mutable borrows). But that seems pretty heavy-handed here — not only does RefCell add .borrow() noise anywhere you actually want to interact with the underlying value, but do I really need to refcount these tiny structs that only hold a handful of floats each?

I set out to find a middle ground.

Solution, kind of

I really, really didn’t want to perform serious surgery on this code just to get it to build. I still didn’t know if it worked at all, and now I had to rearrange it without being able to check if I was breaking it further. (This isn’t Rust’s fault; it’s a natural problem with porting between fairly different paradigms.)

So I kind of hacked it into working with minimal changes, producing a grotesque abomination which I’m ashamed to link to. Here’s how!

First, I got rid of the class. It turns out this makes lifetime juggling much easier right off the bat. I’m pretty sure Rust considers everything in a struct to be destroyed simultaneously (though in practice it guarantees it’ll destroy fields in order), which doesn’t leave much wiggle room. Locals within a function, on the other hand, can each have their own distinct lifetimes, which solves the problem of expressing that the borrows won’t outlive the arena.

Speaking of the arena, I solved the mutability problem there by switching to… an arena! The typed-arena crate (a port of a type used within Rust itself, I think) is an allocator — you give it a value, and it gives you back a reference, and the reference is guaranteed to be valid for as long as the arena exists. The method that does this is sneaky and takes &self rather than &mut self, so Rust doesn’t know you’re mutating the arena and won’t complain. (One drawback is that the arena will never free anything you give to it, but that’s not a big problem here.)


My next problem was with mutation. The main loop repeatedly calls possibleIntersection with pairs of segments, which can split either or both segment. Rust definitely doesn’t like that — I’d have to pass in two &muts, both of which are mutable references into the same arena, and I’d have a bunch of immutable references into that arena in the sweep list and elsewhere. This isn’t going to fly.

This is kind of a shame, and is one place where Rust seems a little overzealous. Something like this seems like it ought to be perfectly valid:

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let mut v = vec![1u32, 2u32];
let a = &mut v[0];
let b = &mut v[1];
// do stuff with a, b

The trouble is, Rust only knows the type signature, which here is something like index_mut(&'a mut self, index: usize) -> &'a T. Nothing about that says that you’re borrowing distinct elements rather than some core part of the type — and, in fact, the above code is only safe because you’re borrowing distinct elements. In the general case, Rust can’t possibly know that. It seems obvious enough from the different indexes, but nothing about the type system even says that different indexes have to return different values. And what if one were borrowed as &mut v[1] and the other were borrowed with v.iter_mut().next().unwrap()?

Anyway, this is exactly where people start to turn to RefCell — if you’re very sure you know better than Rust, then a RefCell will skirt the borrow checker while still enforcing at runtime that you don’t have more than one mutable borrow at a time.

But half the lines in this algorithm examine the endpoints of a segment! I don’t want to wrap the whole thing in a RefCell, or I’ll have to say this everywhere:

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if segment1.borrow().point.x < segment2.borrow().point.x { ... }

Gross.

But wait — this code only mutates the points themselves in one place. When a segment is split, the original segment becomes the left half, and a new segment is created to be the right half. There’s no compelling need for this; it saves an allocation for the left half, but it’s not critical to the algorithm.

Thus, I settled on a compromise. My segment type now looks like this:

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struct SegmentPacket {
    // a bunch of flags and whatnot used in the algorithm
}
struct SweepSegment {
    left_point: MapPoint,
    right_point: MapPoint,
    faces_outwards: bool,
    index: usize,
    order: usize,
    packet: RefCell<SegmentPacket>,
}

I do still need to call .borrow() or .borrow_mut() to get at the stuff in the “packet”, but that’s far less common, so there’s less noise overall. And I don’t need to wrap it in Rc because it’s part of a type that’s allocated in the arena and passed around only via references.


This still leaves me with the problem of how to actually perform the splits.

I’m not especially happy with what I came up with, I don’t know if I can defend it, and I suspect I could do much better. I changed possibleIntersection so that rather than performing splits, it returns the points at which each segment needs splitting, in the form (usize, Option<MapPoint>, Option<MapPoint>). (The usize is used as a flag for calling code and oughta be an enum, but, isn’t yet.)

Now the top-level function is responsible for all arena management, and all is well.

Except, er. possibleIntersection is called multiple times, and I don’t want to copy-paste a dozen lines of split code after each call. I tried putting just that code in its own function, which had the world’s most godawful signature, and that didn’t work because… uh… hm. I can’t remember why, exactly! Should’ve written that down.

I tried a local closure next, but closures capture their environment by reference, so now I had references to a bunch of locals for as long as the closure existed, which meant I couldn’t mutate those locals. Argh. (This seems a little silly to me, since the closure’s references cannot possibly be used for anything if the closure isn’t being called, but maybe I’m missing something. Or maybe this is just a limitation of lifetimes.)

Increasingly desperate, I tried using a macro. But… macros are hygienic, which means that any new name you use inside a macro is different from any name outside that macro. The macro thus could not see any of my locals. Usually that’s good, but here I explicitly wanted the macro to mess with my locals.

I was just about to give up and go live as a hermit in a cabin in the woods, when I discovered something quite incredible. You can define local macros! If you define a macro inside a function, then it can see any locals defined earlier in that function. Perfect!

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macro_rules! _split_segment (
    ($seg:expr, $pt:expr) => (
        {
            let pt = $pt;
            let seg = $seg;
            // ... waaay too much code ...
        }
    );
);

loop {
    // ...
    // This is possibleIntersection, renamed because Rust rightfully complains about camelCase
    let cross = handle_intersections(Some(segment), maybe_above);
    if let Some(pt) = cross.1 {
        segment = _split_segment!(segment, pt);
    }
    if let Some(pt) = cross.2 {
        maybe_above = Some(_split_segment!(maybe_above.unwrap(), pt));
    }
    // ...
}

(This doesn’t actually quite match the original algorithm, which has one case where a segment can be split twice. I realized that I could just do the left-most split, and a later iteration would perform the other split. I sure hope that’s right, anyway.)

It’s a bit ugly, and I ran into a whole lot of implicit behavior from the C++ code that I had to fix — for example, the segment is sometimes mutated just before it’s split, purely as a shortcut for mutating the left part of the split. But it finally compiles! And runs! And kinda worked, a bit!

Aftermath

I still had a lot of work to do.

For one, this code was designed for intersecting two shapes, not mass-intersecting a big pile of shapes. The basic algorithm doesn’t care about how many polygons you start with — all it sees is segments — but the code for constructing the return value needed some heavy modification.

The biggest change by far? The original code traced each segment once, expecting the result to be only a single shape. I had to change that to trace each side of each segment once, since the vast bulk of the output consists of shapes which share a side. This violated a few assumptions, which I had to hack around.

I also ran into a couple very bad edge cases, spent ages debugging them, then found out that the original algorithm had a subtle workaround that I’d commented out because it was awkward to port but didn’t seem to do anything. Whoops!

The worst was a precision error, where a vertical line could be split on a point not quite actually on the line, which wreaked all kinds of havoc. I worked around that with some tasteful rounding, which is highly dubious but makes the output more appealing to my squishy human brain. (I might switch to the original workaround, but I really dislike that even simple cases can spit out points at 1500.0000000000003. The whole thing is parameterized over the coordinate type, so maybe I could throw a rational type in there and cross my fingers?)

All that done, I finally, finally, after a couple months of intermittent progress, got what I wanted!

This is Doom 2’s MAP01. The black area to the left of center is where the player starts. Gray areas indicate where the player can walk from there, with lighter shades indicating more distant areas, where “distance” is measured by the minimum number of line crossings. Red areas can’t be reached at all.

(Note: large playable chunks of the map, including the exit room, are red. That’s because those areas are behind doors, and this code doesn’t understand doors yet.)

(Also note: The big crescent in the lower-right is also black because I was lazy and looked for the player’s starting sector by checking the bbox, and that sector’s bbox happens to match.)

The code that generated this had to go out of its way to delete all the unreachable zones around solid walls. I think I could modify the algorithm to do that on the fly pretty easily, which would probably speed it up a bit too. Downside is that the algorithm would then be pretty specifically tied to this problem, and not usable for any other kind of polygon intersection, which I would think could come up elsewhere? The modifications would be pretty minor, though, so maybe I could confine them to a closure or something.

Some final observations

It runs surprisingly slowly. Like, multiple seconds. Unless I add --release, which speeds it up by a factor of… some number with multiple digits. Wahoo. Debug mode has a high price, especially with a lot of calls in play.

The current state of this code is on GitHub. Please don’t look at it. I’m very sorry.

Honestly, most of my anguish came not from Rust, but from the original code relying on lots of fairly subtle behavior without bothering to explain what it was doing or even hint that anything unusual was going on. God, I hate C++.

I don’t know if the Rust community can learn from this. I don’t know if I even learned from this. Let’s all just quietly forget about it.

Now I just need to figure this one out…

Israeli Security Attacks AMD by Publishing Zero-Day Exploits

Post Syndicated from Bruce Schneier original https://www.schneier.com/blog/archives/2018/03/israeli_securit.html

Last week, the Israeli security company CTS Labs published a series of exploits against AMD chips. The publication came with the flashy website, detailed whitepaper, cool vulnerability names — RYZENFALL, MASTERKEY, FALLOUT, and CHIMERA — and logos we’ve come to expect from these sorts of things. What’s new is that the company only gave AMD a day’s notice, which breaks with every norm about responsible disclosure. CTS Labs didn’t release details of the exploits, only high-level descriptions of the vulnerabilities, but it is probably still enough for others to reproduce their results. This is incredibly irresponsible of the company.

Moreover, the vulnerabilities are kind of meh. Nicholas Weaver explains:

In order to use any of the four vulnerabilities, an attacker must already have almost complete control over the machine. For most purposes, if the attacker already has this access, we would generally say they’ve already won. But these days, modern computers at least attempt to protect against a rogue operating system by having separate secure subprocessors. CTS Labs discovered the vulnerabilities when they looked at AMD’s implementation of the secure subprocessor to see if an attacker, having already taken control of the host operating system, could bypass these last lines of defense.

In a “Clarification,” CTS Labs kind of agrees:

The vulnerabilities described in amdflaws.com could give an attacker that has already gained initial foothold into one or more computers in the enterprise a significant advantage against IT and security teams.

The only thing the attacker would need after the initial local compromise is local admin privileges and an affected machine. To clarify misunderstandings — there is no need for physical access, no digital signatures, no additional vulnerability to reflash an unsigned BIOS. Buy a computer from the store, run the exploits as admin — and they will work (on the affected models as described on the site).

The weirdest thing about this story is that CTS Labs describes one of the vulnerabilities, Chimera, as a backdoor. Although it doesn’t t come out and say that this was deliberately planted by someone, it does make the point that the chips were designed in Taiwan. This is an incredible accusation, and honestly needs more evidence before we can evaluate it.

The upshot of all of this is that CTS Labs played this for maximum publicity: over-hyping its results and minimizing AMD’s ability to respond. And it may have an ulterior motive:

But CTS’s website touting AMD’s flaws also contained a disclaimer that threw some shadows on the company’s motives: “Although we have a good faith belief in our analysis and believe it to be objective and unbiased, you are advised that we may have, either directly or indirectly, an economic interest in the performance of the securities of the companies whose products are the subject of our reports,” reads one line. WIRED asked in a follow-up email to CTS whether the company holds any financial positions designed to profit from the release of its AMD research specifically. CTS didn’t respond.

We all need to demand better behavior from security researchers. I know that any publicity is good publicity, but I am pleased to see the stories critical of CTS Labs outnumbering the stories praising it.

EDITED TO ADD (3/21): AMD responds:

AMD’s response today agrees that all four bug families are real and are found in the various components identified by CTS. The company says that it is developing firmware updates for the three PSP flaws. These fixes, to be made available in “coming weeks,” will be installed through system firmware updates. The firmware updates will also mitigate, in some unspecified way, the Chimera issue, with AMD saying that it’s working with ASMedia, the third-party hardware company that developed Promontory for AMD, to develop suitable protections. In its report, CTS wrote that, while one CTS attack vector was a firmware bug (and hence in principle correctable), the other was a hardware flaw. If true, there may be no effective way of solving it.

Response here.

What John Oliver gets wrong about Bitcoin

Post Syndicated from Robert Graham original http://blog.erratasec.com/2018/03/what-john-oliver-gets-wrong-about.html

John Oliver covered bitcoin/cryptocurrencies last night. I thought I’d describe a bunch of things he gets wrong.

How Bitcoin works

Nowhere in the show does it describe what Bitcoin is and how it works.
Discussions should always start with Satoshi Nakamoto’s original paper. The thing Satoshi points out is that there is an important cost to normal transactions, namely, the entire legal system designed to protect you against fraud, such as the way you can reverse the transactions on your credit card if it gets stolen. The point of Bitcoin is that there is no way to reverse a charge. A transaction is done via cryptography: to transfer money to me, you decrypt it with your secret key and encrypt it with mine, handing ownership over to me with no third party involved that can reverse the transaction, and essentially no overhead.
All the rest of the stuff, like the decentralized blockchain and mining, is all about making that work.
Bitcoin crazies forget about the original genesis of Bitcoin. For example, they talk about adding features to stop fraud, reversing transactions, and having a central authority that manages that. This misses the point, because the existing electronic banking system already does that, and does a better job at it than cryptocurrencies ever can. If you want to mock cryptocurrencies, talk about the “DAO”, which did exactly that — and collapsed in a big fraudulent scheme where insiders made money and outsiders didn’t.
Sticking to Satoshi’s original ideas are a lot better than trying to repeat how the crazy fringe activists define Bitcoin.

How does any money have value?

Oliver’s answer is currencies have value because people agree that they have value, like how they agree a Beanie Baby is worth $15,000.
This is wrong. A better way of asking the question why the value of money changes. The dollar has been losing roughly 2% of its value each year for decades. This is called “inflation”, as the dollar loses value, it takes more dollars to buy things, which means the price of things (in dollars) goes up, and employers have to pay us more dollars so that we can buy the same amount of things.
The reason the value of the dollar changes is largely because the Federal Reserve manages the supply of dollars, using the same law of Supply and Demand. As you know, if a supply decreases (like oil), then the price goes up, or if the supply of something increases, the price goes down. The Fed manages money the same way: when prices rise (the dollar is worth less), the Fed reduces the supply of dollars, causing it to be worth more. Conversely, if prices fall (or don’t rise fast enough), the Fed increases supply, so that the dollar is worth less.
The reason money follows the law of Supply and Demand is because people use money, they consume it like they do other goods and services, like gasoline, tax preparation, food, dance lessons, and so forth. It’s not like a fine art painting, a stamp collection or a Beanie Baby — money is a product. It’s just that people have a hard time thinking of it as a consumer product since, in their experience, money is what they use to buy consumer products. But it’s a symmetric operation: when you buy gasoline with dollars, you are actually selling dollars in exchange for gasoline. That you call one side in this transaction “money” and the other “goods” is purely arbitrary, you call gasoline money and dollars the good that is being bought and sold for gasoline.
The reason dollars is a product is because trying to use gasoline as money is a pain in the neck. Storing it and exchanging it is difficult. Goods like this do become money, such as famously how prisons often use cigarettes as a medium of exchange, even for non-smokers, but it has to be a good that is fungible, storable, and easily exchanged. Dollars are the most fungible, the most storable, and the easiest exchanged, so has the most value as “money”. Sure, the mechanic can fix the farmers car for three chickens instead, but most of the time, both parties in the transaction would rather exchange the same value using dollars than chickens.
So the value of dollars is not like the value of Beanie Babies, which people might buy for $15,000, which changes purely on the whims of investors. Instead, a dollar is like gasoline, which obey the law of Supply and Demand.
This brings us back to the question of where Bitcoin gets its value. While Bitcoin is indeed used like dollars to buy things, that’s only a tiny use of the currency, so therefore it’s value isn’t determined by Supply and Demand. Instead, the value of Bitcoin is a lot like Beanie Babies, obeying the laws of investments. So in this respect, Oliver is right about where the value of Bitcoin comes, but wrong about where the value of dollars comes from.

Why Bitcoin conference didn’t take Bitcoin

John Oliver points out the irony of a Bitcoin conference that stopped accepting payments in Bitcoin for tickets.
The biggest reason for this is because Bitcoin has become so popular that transaction fees have gone up. Instead of being proof of failure, it’s proof of popularity. What John Oliver is saying is the old joke that nobody goes to that popular restaurant anymore because it’s too crowded and you can’t get a reservation.
Moreover, the point of Bitcoin is not to replace everyday currencies for everyday transactions. If you read Satoshi Nakamoto’s whitepaper, it’s only goal is to replace certain types of transactions, like purely electronic transactions where electronic goods and services are being exchanged. Where real-life goods/services are being exchanged, existing currencies work just fine. It’s only the crazy activists who claim Bitcoin will eventually replace real world currencies — the saner people see it co-existing with real-world currencies, each with a different value to consumers.

Turning a McNugget back into a chicken

John Oliver uses the metaphor of turning a that while you can process a chicken into McNuggets, you can’t reverse the process. It’s a funny metaphor.
But it’s not clear what the heck this metaphor is trying explain. That’s not a metaphor for the blockchain, but a metaphor for a “cryptographic hash”, where each block is a chicken, and the McNugget is the signature for the block (well, the block plus the signature of the last block, forming a chain).
Even then that metaphor as problems. The McNugget produced from each chicken must be unique to that chicken, for the metaphor to accurately describe a cryptographic hash. You can therefore identify the original chicken simply by looking at the McNugget. A slight change in the original chicken, like losing a feather, results in a completely different McNugget. Thus, nuggets can be used to tell if the original chicken has changed.
This then leads to the key property of the blockchain, it is unalterable. You can’t go back and change any of the blocks of data, because the fingerprints, the nuggets, will also change, and break the nugget chain.
The point is that while John Oliver is laughing at a silly metaphor to explain the blockchain becuase he totally misses the point of the metaphor.
Oliver rightly says “don’t worry if you don’t understand it — most people don’t”, but that includes the big companies that John Oliver name. Some companies do get it, and are producing reasonable things (like JP Morgan, by all accounts), but some don’t. IBM and other big consultancies are charging companies millions of dollars to consult with them on block chain products where nobody involved, the customer or the consultancy, actually understand any of it. That doesn’t stop them from happily charging customers on one side and happily spending money on the other.
Thus, rather than Oliver explaining the problem, he’s just being part of the problem. His explanation of blockchain left you dumber than before.

ICO’s

John Oliver mocks the Brave ICO ($35 million in 30 seconds), claiming it’s all driven by YouTube personalities and people who aren’t looking at the fundamentals.
And while this is true, most ICOs are bunk, the  Brave ICO actually had a business model behind it. Brave is a Chrome-like web-browser whose distinguishing feature is that it protects your privacy from advertisers. If you don’t use Brave or a browser with an ad block extension, you have no idea how bad things are for you. However, this presents a problem for websites that fund themselves via advertisements, which is most of them, because visitors no longer see ads. Brave has a fix for this. Most people wouldn’t mind supporting the websites they visit often, like the New York Times. That’s where the Brave ICO “token” comes in: it’s not simply stock in Brave, but a token for micropayments to websites. Users buy tokens, then use them for micropayments to websites like New York Times. The New York Times then sells the tokens back to the market for dollars. The buying and selling of tokens happens without a centralized middleman.
This is still all speculative, of course, and it remains to be seen how successful Brave will be, but it’s a serious effort. It has well respected VC behind the company, a well-respected founder (despite the fact he invented JavaScript), and well-respected employees. It’s not a scam, it’s a legitimate venture.

How to you make money from Bitcoin?

The last part of the show is dedicated to describing all the scam out there, advising people to be careful, and to be “responsible”. This is garbage.
It’s like my simple two step process to making lots of money via Bitcoin: (1) buy when the price is low, and (2) sell when the price is high. My advice is correct, of course, but useless. Same as “be careful” and “invest responsibly”.
The truth about investing in cryptocurrencies is “don’t”. The only responsible way to invest is to buy low-overhead market index funds and hold for retirement. No, you won’t get super rich doing this, but anything other than this is irresponsible gambling.
It’s a hard lesson to learn, because everyone is telling you the opposite. The entire channel CNBC is devoted to day traders, who buy and sell stocks at a high rate based on the same principle as a ponzi scheme, basing their judgment not on the fundamentals (like long term dividends) but animal spirits of whatever stock is hot or cold at the moment. This is the same reason people buy or sell Bitcoin, not because they can describe the fundamental value, but because they believe in a bigger fool down the road who will buy it for even more.
For things like Bitcoin, the trick to making money is to have bought it over 7 years ago when it was essentially worthless, except to nerds who were into that sort of thing. It’s the same tick to making a lot of money in Magic: The Gathering trading cards, which nerds bought decades ago which are worth a ton of money now. Or, to have bought Apple stock back in 2009 when the iPhone was new, when nerds could understand the potential of real Internet access and apps that Wall Street could not.
That was my strategy: be a nerd, who gets into things. I’ve made a good amount of money on all these things because as a nerd, I was into Magic: The Gathering, Bitcoin, and the iPhone before anybody else was, and bought in at the point where these things were essentially valueless.
At this point with cryptocurrencies, with the non-nerds now flooding the market, there little chance of making it rich. The lottery is probably a better bet. Instead, if you want to make money, become a nerd, obsess about a thing, understand a thing when its new, and cash out once the rest of the market figures it out. That might be Brave, for example, but buy into it because you’ve spent the last year studying the browser advertisement ecosystem, the market’s willingness to pay for content, and how their Basic Attention Token delivers value to websites — not because you want in on the ICO craze.

Conclusion

John Oliver spends 25 minutes explaining Bitcoin, Cryptocurrencies, and the Blockchain to you. Sure, it’s funny, but it leaves you worse off than when it started. It admits they “simplify” the explanation, but they simplified it so much to the point where they removed all useful information.

libsodium – Easy-to-use Software Library For Encryption

Post Syndicated from Darknet original https://www.darknet.org.uk/2018/03/libsodium-easy-to-use-software-library-for-encryption/?utm_source=rss&utm_medium=social&utm_campaign=darknetfeed

libsodium – Easy-to-use Software Library For Encryption

Sodium is a new, easy-to-use software library for encryption, decryption, signatures, password hashing and more. It is a portable, cross-compilable, installable, packageable fork of NaCl, with a compatible API, and an extended API to improve usability even further.

Its goal is to provide all of the core operations needed to build higher-level cryptographic tools. Sodium supports a variety of compilers and operating systems, including Windows (with MingW or Visual Studio, x86 and x64), iOS, Android, as well as Javascript and Webassembly.

Read the rest of libsodium – Easy-to-use Software Library For Encryption now! Only available at Darknet.

Intimate Partner Threat

Post Syndicated from Bruce Schneier original https://www.schneier.com/blog/archives/2018/03/intimate_partne.html

Princeton’s Karen Levy has a good article computer security and the intimate partner threat:

When you learn that your privacy has been compromised, the common advice is to prevent additional access — delete your insecure account, open a new one, change your password. This advice is such standard protocol for personal security that it’s almost a no-brainer. But in abusive romantic relationships, disconnection can be extremely fraught. For one, it can put the victim at risk of physical harm: If abusers expect digital access and that access is suddenly closed off, it can lead them to become more violent or intrusive in other ways. It may seem cathartic to delete abusive material, like alarming text messages — but if you don’t preserve that kind of evidence, it can make prosecution more difficult. And closing some kinds of accounts, like social networks, to hide from a determined abuser can cut off social support that survivors desperately need. In some cases, maintaining a digital connection to the abuser may even be legally required (for instance, if the abuser and survivor share joint custody of children).

Threats from intimate partners also change the nature of what it means to be authenticated online. In most contexts, access credentials­ — like passwords and security questions — are intended to insulate your accounts against access from an adversary. But those mechanisms are often completely ineffective for security in intimate contexts: The abuser can compel disclosure of your password through threats of violence and has access to your devices because you’re in the same physical space. In many cases, the abuser might even own your phone — or might have access to your communications data because you share a family plan. Things like security questions are unlikely to be effective tools for protecting your security, because the abuser knows or can guess at intimate details about your life — where you were born, what your first job was, the name of your pet.

AskRob: Does Tor let government peek at vuln info?

Post Syndicated from Robert Graham original http://blog.erratasec.com/2018/03/askrob-does-tor-let-government-peek-at.html

On Twitter, somebody asked this question:

The question is about a blog post that claims Tor privately tips off the government about vulnerabilities, using as proof a “vulnerability” from October 2007 that wasn’t made public until 2011.
The tl;dr is that it’s bunk. There was no vulnerability, it was a feature request. The details were already public. There was no spy agency involved, but the agency that does Voice of America, and which tries to protect activists under foreign repressive regimes.

Discussion

The issue is that Tor traffic looks like Tor traffic, making it easy to block/censor, or worse, identify users. Over the years, Tor has added features to make it look more and more like normal traffic, like the encrypted traffic used by Facebook, Google, and Apple. Tors improves this bit-by-bit over time, but short of actually piggybacking on website traffic, it will always leave some telltale signature.
An example showing how we can distinguish Tor traffic is the packet below, from the latest version of the Tor server:
Had this been Google or Facebook, the names would be something like “www.google.com” or “facebook.com”. Or, had this been a normal “self-signed” certificate, the names would still be recognizable. But Tor creates randomized names, with letters and numbers, making it distinctive. It’s hard to automate detection of this, because it’s only probably Tor (other self-signed certificates look like this, too), which means you’ll have occasional “false-positives”. But still, if you compare this to the pattern of traffic, you can reliably detect that Tor is happening on your network.
This has always been a known issue, since the earliest days. Google the search term “detect tor traffic”, and set your advanced search dates to before 2007, and you’ll see lots of discussion about this, such as this post for writing intrusion-detection signatures for Tor.
Among the things you’ll find is this presentation from 2006 where its creator (Roger Dingledine) talks about how Tor can be identified on the network with its unique network fingerprint. For a “vulnerability” they supposedly kept private until 2011, they were awfully darn public about it.
The above blogpost claims Tor kept this vulnerability secret until 2011 by citing this message. It’s because Levine doesn’t understand the terminology and is just blindly searching for an exact match for “TLS normalization”. Here’s an earlier proposed change for the long term goal of to “make our connection handshake look closer to a regular HTTPS [TLS] connection”, from February 2007. Here is another proposal from October 2007 on changing TLS certificates, from days after the email discussion (after they shipped the feature, presumably).
What we see here is here is a known problem from the very beginning of the project, a long term effort to fix that problem, and a slow dribble of features added over time to preserve backwards compatibility.
Now let’s talk about the original train of emails cited in the blogpost. It’s hard to see the full context here, but it sounds like BBG made a feature request to make Tor look even more like normal TLS, which is hinted with the phrase “make our funders happy”. Of course the people giving Tor money are going to ask for improvements, and of course Tor would in turn discuss those improvements with the donor before implementing them. It’s common in project management: somebody sends you a feature request, you then send the proposal back to them to verify what you are building is what they asked for.
As for the subsequent salacious paragraph about “secrecy”, that too is normal. When improving a problem, you don’t want to talk about the details until after you have a fix. But note that this is largely more for PR than anything else. The details on how to detect Tor are available to anybody who looks for them — they just aren’t readily accessible to the layman. For example, Tenable Networks announced the previous month exactly this ability to detect Tor’s traffic, because any techy wanting to would’ve found the secrets how to. Indeed, Teneble’s announcement may have been the impetus for BBG’s request to Tor: “can you fix it so that this new Tenable feature no longer works”.
To be clear, there are zero secret “vulnerability details” here that some secret spy agency could use to detect Tor. They were already known, and in the Teneble product, and within the grasp of any techy who wanted to discover them. A spy agency could just buy Teneble, or copy it, instead of going through this intricate conspiracy.

Conclusion

The issue isn’t a “vulnerability”. Tor traffic is recognizable on the network, and over time, they make it less and less recognizable. Eventually they’ll just piggyback on true HTTPS and convince CloudFlare to host ingress nodes, or something, making it completely undetectable. In the meanwhile, it leaves behind fingerprints, as I showed above.
What we see in the email exchanges is the normal interaction of a donor asking for a feature, not a private “tip off”. It’s likely the donor is the one who tipped off Tor, pointing out Tenable’s product to detect Tor.
Whatever secrets Tor could have tipped off to the “secret spy agency” were no more than what Tenable was already doing in a shipping product.

Update: People are trying to make it look like Voice of America is some sort of intelligence agency. That’s a conspiracy theory. It’s not a member of the American intelligence community. You’d have to come up with a solid reason explaining why the United States is hiding VoA’s membership in the intelligence community, or you’d have to believe that everything in the U.S. government is really just some arm of the C.I.A.

Best Practices for Running Apache Cassandra on Amazon EC2

Post Syndicated from Prasad Alle original https://aws.amazon.com/blogs/big-data/best-practices-for-running-apache-cassandra-on-amazon-ec2/

Apache Cassandra is a commonly used, high performance NoSQL database. AWS customers that currently maintain Cassandra on-premises may want to take advantage of the scalability, reliability, security, and economic benefits of running Cassandra on Amazon EC2.

Amazon EC2 and Amazon Elastic Block Store (Amazon EBS) provide secure, resizable compute capacity and storage in the AWS Cloud. When combined, you can deploy Cassandra, allowing you to scale capacity according to your requirements. Given the number of possible deployment topologies, it’s not always trivial to select the most appropriate strategy suitable for your use case.

In this post, we outline three Cassandra deployment options, as well as provide guidance about determining the best practices for your use case in the following areas:

  • Cassandra resource overview
  • Deployment considerations
  • Storage options
  • Networking
  • High availability and resiliency
  • Maintenance
  • Security

Before we jump into best practices for running Cassandra on AWS, we should mention that we have many customers who decided to use DynamoDB instead of managing their own Cassandra cluster. DynamoDB is fully managed, serverless, and provides multi-master cross-region replication, encryption at rest, and managed backup and restore. Integration with AWS Identity and Access Management (IAM) enables DynamoDB customers to implement fine-grained access control for their data security needs.

Several customers who have been using large Cassandra clusters for many years have moved to DynamoDB to eliminate the complications of administering Cassandra clusters and maintaining high availability and durability themselves. Gumgum.com is one customer who migrated to DynamoDB and observed significant savings. For more information, see Moving to Amazon DynamoDB from Hosted Cassandra: A Leap Towards 60% Cost Saving per Year.

AWS provides options, so you’re covered whether you want to run your own NoSQL Cassandra database, or move to a fully managed, serverless DynamoDB database.

Cassandra resource overview

Here’s a short introduction to standard Cassandra resources and how they are implemented with AWS infrastructure. If you’re already familiar with Cassandra or AWS deployments, this can serve as a refresher.

ResourceCassandraAWS
Cluster

A single Cassandra deployment.

 

This typically consists of multiple physical locations, keyspaces, and physical servers.

A logical deployment construct in AWS that maps to an AWS CloudFormation StackSet, which consists of one or many CloudFormation stacks to deploy Cassandra.
DatacenterA group of nodes configured as a single replication group.

A logical deployment construct in AWS.

 

A datacenter is deployed with a single CloudFormation stack consisting of Amazon EC2 instances, networking, storage, and security resources.

Rack

A collection of servers.

 

A datacenter consists of at least one rack. Cassandra tries to place the replicas on different racks.

A single Availability Zone.
Server/nodeA physical virtual machine running Cassandra software.An EC2 instance.
TokenConceptually, the data managed by a cluster is represented as a ring. The ring is then divided into ranges equal to the number of nodes. Each node being responsible for one or more ranges of the data. Each node gets assigned with a token, which is essentially a random number from the range. The token value determines the node’s position in the ring and its range of data.Managed within Cassandra.
Virtual node (vnode)Responsible for storing a range of data. Each vnode receives one token in the ring. A cluster (by default) consists of 256 tokens, which are uniformly distributed across all servers in the Cassandra datacenter.Managed within Cassandra.
Replication factorThe total number of replicas across the cluster.Managed within Cassandra.

Deployment considerations

One of the many benefits of deploying Cassandra on Amazon EC2 is that you can automate many deployment tasks. In addition, AWS includes services, such as CloudFormation, that allow you to describe and provision all your infrastructure resources in your cloud environment.

We recommend orchestrating each Cassandra ring with one CloudFormation template. If you are deploying in multiple AWS Regions, you can use a CloudFormation StackSet to manage those stacks. All the maintenance actions (scaling, upgrading, and backing up) should be scripted with an AWS SDK. These may live as standalone AWS Lambda functions that can be invoked on demand during maintenance.

You can get started by following the Cassandra Quick Start deployment guide. Keep in mind that this guide does not address the requirements to operate a production deployment and should be used only for learning more about Cassandra.

Deployment patterns

In this section, we discuss various deployment options available for Cassandra in Amazon EC2. A successful deployment starts with thoughtful consideration of these options. Consider the amount of data, network environment, throughput, and availability.

  • Single AWS Region, 3 Availability Zones
  • Active-active, multi-Region
  • Active-standby, multi-Region

Single region, 3 Availability Zones

In this pattern, you deploy the Cassandra cluster in one AWS Region and three Availability Zones. There is only one ring in the cluster. By using EC2 instances in three zones, you ensure that the replicas are distributed uniformly in all zones.

To ensure the even distribution of data across all Availability Zones, we recommend that you distribute the EC2 instances evenly in all three Availability Zones. The number of EC2 instances in the cluster is a multiple of three (the replication factor).

This pattern is suitable in situations where the application is deployed in one Region or where deployments in different Regions should be constrained to the same Region because of data privacy or other legal requirements.

ProsCons

●     Highly available, can sustain failure of one Availability Zone.

●     Simple deployment

●     Does not protect in a situation when many of the resources in a Region are experiencing intermittent failure.

 

Active-active, multi-Region

In this pattern, you deploy two rings in two different Regions and link them. The VPCs in the two Regions are peered so that data can be replicated between two rings.

We recommend that the two rings in the two Regions be identical in nature, having the same number of nodes, instance types, and storage configuration.

This pattern is most suitable when the applications using the Cassandra cluster are deployed in more than one Region.

ProsCons

●     No data loss during failover.

●     Highly available, can sustain when many of the resources in a Region are experiencing intermittent failures.

●     Read/write traffic can be localized to the closest Region for the user for lower latency and higher performance.

●     High operational overhead

●     The second Region effectively doubles the cost

 

Active-standby, multi-region

In this pattern, you deploy two rings in two different Regions and link them. The VPCs in the two Regions are peered so that data can be replicated between two rings.

However, the second Region does not receive traffic from the applications. It only functions as a secondary location for disaster recovery reasons. If the primary Region is not available, the second Region receives traffic.

We recommend that the two rings in the two Regions be identical in nature, having the same number of nodes, instance types, and storage configuration.

This pattern is most suitable when the applications using the Cassandra cluster require low recovery point objective (RPO) and recovery time objective (RTO).

ProsCons

●     No data loss during failover.

●     Highly available, can sustain failure or partitioning of one whole Region.

●     High operational overhead.

●     High latency for writes for eventual consistency.

●     The second Region effectively doubles the cost.

Storage options

In on-premises deployments, Cassandra deployments use local disks to store data. There are two storage options for EC2 instances:

Your choice of storage is closely related to the type of workload supported by the Cassandra cluster. Instance store works best for most general purpose Cassandra deployments. However, in certain read-heavy clusters, Amazon EBS is a better choice.

The choice of instance type is generally driven by the type of storage:

  • If ephemeral storage is required for your application, a storage-optimized (I3) instance is the best option.
  • If your workload requires Amazon EBS, it is best to go with compute-optimized (C5) instances.
  • Burstable instance types (T2) don’t offer good performance for Cassandra deployments.

Instance store

Ephemeral storage is local to the EC2 instance. It may provide high input/output operations per second (IOPs) based on the instance type. An SSD-based instance store can support up to 3.3M IOPS in I3 instances. This high performance makes it an ideal choice for transactional or write-intensive applications such as Cassandra.

In general, instance storage is recommended for transactional, large, and medium-size Cassandra clusters. For a large cluster, read/write traffic is distributed across a higher number of nodes, so the loss of one node has less of an impact. However, for smaller clusters, a quick recovery for the failed node is important.

As an example, for a cluster with 100 nodes, the loss of 1 node is 3.33% loss (with a replication factor of 3). Similarly, for a cluster with 10 nodes, the loss of 1 node is 33% less capacity (with a replication factor of 3).

 Ephemeral storageAmazon EBSComments

IOPS

(translates to higher query performance)

Up to 3.3M on I3

80K/instance

10K/gp2/volume

32K/io1/volume

This results in a higher query performance on each host. However, Cassandra implicitly scales well in terms of horizontal scale. In general, we recommend scaling horizontally first. Then, scale vertically to mitigate specific issues.

 

Note: 3.3M IOPS is observed with 100% random read with a 4-KB block size on Amazon Linux.

AWS instance typesI3Compute optimized, C5Being able to choose between different instance types is an advantage in terms of CPU, memory, etc., for horizontal and vertical scaling.
Backup/ recoveryCustomBasic building blocks are available from AWS.

Amazon EBS offers distinct advantage here. It is small engineering effort to establish a backup/restore strategy.

a) In case of an instance failure, the EBS volumes from the failing instance are attached to a new instance.

b) In case of an EBS volume failure, the data is restored by creating a new EBS volume from last snapshot.

Amazon EBS

EBS volumes offer higher resiliency, and IOPs can be configured based on your storage needs. EBS volumes also offer some distinct advantages in terms of recovery time. EBS volumes can support up to 32K IOPS per volume and up to 80K IOPS per instance in RAID configuration. They have an annualized failure rate (AFR) of 0.1–0.2%, which makes EBS volumes 20 times more reliable than typical commodity disk drives.

The primary advantage of using Amazon EBS in a Cassandra deployment is that it reduces data-transfer traffic significantly when a node fails or must be replaced. The replacement node joins the cluster much faster. However, Amazon EBS could be more expensive, depending on your data storage needs.

Cassandra has built-in fault tolerance by replicating data to partitions across a configurable number of nodes. It can not only withstand node failures but if a node fails, it can also recover by copying data from other replicas into a new node. Depending on your application, this could mean copying tens of gigabytes of data. This adds additional delay to the recovery process, increases network traffic, and could possibly impact the performance of the Cassandra cluster during recovery.

Data stored on Amazon EBS is persisted in case of an instance failure or termination. The node’s data stored on an EBS volume remains intact and the EBS volume can be mounted to a new EC2 instance. Most of the replicated data for the replacement node is already available in the EBS volume and won’t need to be copied over the network from another node. Only the changes made after the original node failed need to be transferred across the network. That makes this process much faster.

EBS volumes are snapshotted periodically. So, if a volume fails, a new volume can be created from the last known good snapshot and be attached to a new instance. This is faster than creating a new volume and coping all the data to it.

Most Cassandra deployments use a replication factor of three. However, Amazon EBS does its own replication under the covers for fault tolerance. In practice, EBS volumes are about 20 times more reliable than typical disk drives. So, it is possible to go with a replication factor of two. This not only saves cost, but also enables deployments in a region that has two Availability Zones.

EBS volumes are recommended in case of read-heavy, small clusters (fewer nodes) that require storage of a large amount of data. Keep in mind that the Amazon EBS provisioned IOPS could get expensive. General purpose EBS volumes work best when sized for required performance.

Networking

If your cluster is expected to receive high read/write traffic, select an instance type that offers 10–Gb/s performance. As an example, i3.8xlarge and c5.9xlarge both offer 10–Gb/s networking performance. A smaller instance type in the same family leads to a relatively lower networking throughput.

Cassandra generates a universal unique identifier (UUID) for each node based on IP address for the instance. This UUID is used for distributing vnodes on the ring.

In the case of an AWS deployment, IP addresses are assigned automatically to the instance when an EC2 instance is created. With the new IP address, the data distribution changes and the whole ring has to be rebalanced. This is not desirable.

To preserve the assigned IP address, use a secondary elastic network interface with a fixed IP address. Before swapping an EC2 instance with a new one, detach the secondary network interface from the old instance and attach it to the new one. This way, the UUID remains same and there is no change in the way that data is distributed in the cluster.

If you are deploying in more than one region, you can connect the two VPCs in two regions using cross-region VPC peering.

High availability and resiliency

Cassandra is designed to be fault-tolerant and highly available during multiple node failures. In the patterns described earlier in this post, you deploy Cassandra to three Availability Zones with a replication factor of three. Even though it limits the AWS Region choices to the Regions with three or more Availability Zones, it offers protection for the cases of one-zone failure and network partitioning within a single Region. The multi-Region deployments described earlier in this post protect when many of the resources in a Region are experiencing intermittent failure.

Resiliency is ensured through infrastructure automation. The deployment patterns all require a quick replacement of the failing nodes. In the case of a regionwide failure, when you deploy with the multi-Region option, traffic can be directed to the other active Region while the infrastructure is recovering in the failing Region. In the case of unforeseen data corruption, the standby cluster can be restored with point-in-time backups stored in Amazon S3.

Maintenance

In this section, we look at ways to ensure that your Cassandra cluster is healthy:

  • Scaling
  • Upgrades
  • Backup and restore

Scaling

Cassandra is horizontally scaled by adding more instances to the ring. We recommend doubling the number of nodes in a cluster to scale up in one scale operation. This leaves the data homogeneously distributed across Availability Zones. Similarly, when scaling down, it’s best to halve the number of instances to keep the data homogeneously distributed.

Cassandra is vertically scaled by increasing the compute power of each node. Larger instance types have proportionally bigger memory. Use deployment automation to swap instances for bigger instances without downtime or data loss.

Upgrades

All three types of upgrades (Cassandra, operating system patching, and instance type changes) follow the same rolling upgrade pattern.

In this process, you start with a new EC2 instance and install software and patches on it. Thereafter, remove one node from the ring. For more information, see Cassandra cluster Rolling upgrade. Then, you detach the secondary network interface from one of the EC2 instances in the ring and attach it to the new EC2 instance. Restart the Cassandra service and wait for it to sync. Repeat this process for all nodes in the cluster.

Backup and restore

Your backup and restore strategy is dependent on the type of storage used in the deployment. Cassandra supports snapshots and incremental backups. When using instance store, a file-based backup tool works best. Customers use rsync or other third-party products to copy data backups from the instance to long-term storage. For more information, see Backing up and restoring data in the DataStax documentation. This process has to be repeated for all instances in the cluster for a complete backup. These backup files are copied back to new instances to restore. We recommend using S3 to durably store backup files for long-term storage.

For Amazon EBS based deployments, you can enable automated snapshots of EBS volumes to back up volumes. New EBS volumes can be easily created from these snapshots for restoration.

Security

We recommend that you think about security in all aspects of deployment. The first step is to ensure that the data is encrypted at rest and in transit. The second step is to restrict access to unauthorized users. For more information about security, see the Cassandra documentation.

Encryption at rest

Encryption at rest can be achieved by using EBS volumes with encryption enabled. Amazon EBS uses AWS KMS for encryption. For more information, see Amazon EBS Encryption.

Instance store–based deployments require using an encrypted file system or an AWS partner solution. If you are using DataStax Enterprise, it supports transparent data encryption.

Encryption in transit

Cassandra uses Transport Layer Security (TLS) for client and internode communications.

Authentication

The security mechanism is pluggable, which means that you can easily swap out one authentication method for another. You can also provide your own method of authenticating to Cassandra, such as a Kerberos ticket, or if you want to store passwords in a different location, such as an LDAP directory.

Authorization

The authorizer that’s plugged in by default is org.apache.cassandra.auth.Allow AllAuthorizer. Cassandra also provides a role-based access control (RBAC) capability, which allows you to create roles and assign permissions to these roles.

Conclusion

In this post, we discussed several patterns for running Cassandra in the AWS Cloud. This post describes how you can manage Cassandra databases running on Amazon EC2. AWS also provides managed offerings for a number of databases. To learn more, see Purpose-built databases for all your application needs.

If you have questions or suggestions, please comment below.


Additional Reading

If you found this post useful, be sure to check out Analyze Your Data on Amazon DynamoDB with Apache Spark and Analysis of Top-N DynamoDB Objects using Amazon Athena and Amazon QuickSight.


About the Authors

Prasad Alle is a Senior Big Data Consultant with AWS Professional Services. He spends his time leading and building scalable, reliable Big data, Machine learning, Artificial Intelligence and IoT solutions for AWS Enterprise and Strategic customers. His interests extend to various technologies such as Advanced Edge Computing, Machine learning at Edge. In his spare time, he enjoys spending time with his family.

 

 

 

Provanshu Dey is a Senior IoT Consultant with AWS Professional Services. He works on highly scalable and reliable IoT, data and machine learning solutions with our customers. In his spare time, he enjoys spending time with his family and tinkering with electronics & gadgets.

 

 

 

Adding Visible Electronic Signatures To PDFs

Post Syndicated from Bozho original https://techblog.bozho.net/adding-visible-electronic-signatures-pdf/

I’m aware this is going to be a very niche topic. Electronically signing PDFs is far from a mainstream usecase. However, I’ll write it for two reasons – first, I think it will be very useful for those few who actually need it, and second, I think it will become more and more common as the eIDAS regulation gain popularity – it basically says that electronic signatures are recognized everywhere in Europe (now, it’s not exactly true, because of some boring legal details, but anyway).

So, what is the usecase – first, you have to electronically sign the PDF with an a digital signature (the legal term is “electronic signature”, so I’ll use them interchangeably, although they don’t fully match – e.g. any electronic data applied to other data can be seen as an electronic signature, where a digital signature is the PKI-based signature).

Second, you may want to actually display the signature on the pages, rather than have the PDF reader recognize it and show it in some side-panel. Why is that? Because people are used to seeing signatures on pages and some may insist on having the signature visible (true story – I’ve got a comment that a detached signature “is not a REAL electronic signature, because it’s not visible on the page”).

Now, notice that I wrote “pages”, on “page”. Yes, an electronic document doesn’t have pages – it’s a stream of bytes. So having the signature just on the last page is okay. But, again, people are used to signing all pages, so they’d prefer the electronic signature to be visible on all pages.

And that makes the task tricky – PDF is good with having a digital signature box on the last page, but having multiple such boxes doesn’t work well. Therefore one has to add other types of annotations that look like a signature box and when clicked open the signature panel (just like an actual signature box).

I have to introduce here DSS – a wonderful set of components by the European Commission that can be used to sign and validate all sorts of electronic signatures. It’s open source, you can use at any way you like. Deploy the demo application, use only the libraries, whatever. It includes the signing functionality out of the box – just check the PAdESService or the PDFBoxSignatureService. It even includes the option to visualize the signature once (on a particular page).

However, it doesn’t have the option to show “stamps” (images) on multiple pages. Which is why I forked it and implemented the functionality. Most of my changes are in the PDFBoxSignatureService in the loadAndStampDocument(..) method. If you want to use that functionality you can just build a jar from my fork and use it (by passing the appropriate SignatureImageParameters to PAdESSErvice.sign(..) to define how the signature will look like).

Why is this needed in the first place? Because when a document is signed, you cannot modify it anymore, as you will change the hash. However, PDFs have incremental updates which allow appending to the document and thus having a newer version without modifying anything in the original version. That way the signature is still valid (the originally signed content is not modified), but new stuff is added. In our case, this new stuff is some “annotations”, which represent an image and a clickable area that opens the signature panel (in Adobe Reader at least). And while they are added before the signature box is added, if there are more than one signer, then the 2nd signer’s annotations are added after the first signature.

Sadly, PDFBox doesn’t support that out of the box. Well, it almost does – the piece of code below looks hacky, and it took a while to figure what exactly should be called and when, but it works with just a single reflection call:

    for (PDPage page : pdDocument.getPages()) {
        // reset existing annotations (needed in order to have the stamps added)
        page.setAnnotations(null);
    }
    // reset document outline (needed in order to have the stamps added)
    pdDocument.getDocumentCatalog().setDocumentOutline(null);
    List<PDAnnotation> annotations = addStamps(pdDocument, parameters);
			
    setDocumentId(parameters, pdDocument);
    ByteArrayOutputStream baos = new ByteArrayOutputStream();
    try (COSWriter writer = new COSWriter(baos, new RandomAccessBuffer(pdfBytes))) {
        // force-add the annotations (wouldn't be saved in incremental updates otherwise)
        annotations.forEach(ann -> addObjectToWrite(writer, ann.getCOSObject()));
				
        // technically the same as saveIncremental but with more control
        writer.write(pdDocument);
    }
    pdDocument.close();
    pdDocument = PDDocument.load(baos.toByteArray());
    ...
}

private void addObjectToWrite(COSWriter writer, COSDictionary cosObject) {
    // the COSWriter does not expose the addObjectToWrite method, so we need reflection to add the annotations
    try {
        Method method = writer.getClass().getDeclaredMethod("addObjectToWrite", COSBase.class);
        method.setAccessible(true);
        method.invoke(writer, cosObject);
    } catch (Exception ex) {
        throw new RuntimeException(ex);
    }
}

What it does is – loads the original PDF, clears some internal catalogs, adds the annotations (images) to all pages, and then “force-add the annotations” because they “wouldn’t be saved in incremental updates otherwise”. I hope PDFBox make this a little more straightforward, but for the time being this works, and it doesn’t invalidate the existing signatures.

I hope that this posts introduces you to:

  • the existence of legally binding electronic signatures
  • the existence of the DSS utilities
  • the PAdES standard for PDF signing
  • how to place more than just one signature box in a PDF document

And I hope this article becomes more and more popular over time, as more and more businesses realize they could make use of electronic signatures.

The post Adding Visible Electronic Signatures To PDFs appeared first on Bozho's tech blog.

Community Profile: Estefannie Explains It All

Post Syndicated from Alex Bate original https://www.raspberrypi.org/blog/community-profile-estefannie/

This column is from The MagPi issue 59. You can download a PDF of the full issue for free, or subscribe to receive the print edition through your letterbox or the digital edition on your tablet. All proceeds from the print and digital editions help the Raspberry Pi Foundation achieve our charitable goals.

“Hey, world!” Estefannie exclaims, a wide grin across her face as the camera begins to roll for another YouTube tutorial video. With a growing number of followers and wonderful support from her fans, Estefannie is building a solid reputation as an online maker, creating unique, fun content accessible to all.

A woman sitting at a desk with a laptop and papers — Estefannie Explains it All Raspberry Pi

It’s as if she was born into performing and making for an audience, but this fun, enjoyable journey to social media stardom came not from a desire to be in front of the camera, but rather as a unique approach to her own learning. While studying, Estefannie decided the best way to confirm her knowledge of a subject was to create an educational video explaining it. If she could teach a topic successfully, she knew she’d retained the information. And so her YouTube channel, Estefannie Explains It All, came into being.

Note taking — Estefannie Explains it All

Her first videos featured pages of notes with voice-over explanations of data structure and algorithm analysis. Then she moved in front of the camera, and expanded her skills in the process.

But YouTube isn’t her only outlet. With nearly 50000 followers, Estefannie’s Instagram game is strong, adding to an increasing number of female coders taking to the platform. Across her Instagram grid, you’ll find insights into her daily routine, from programming on location for work to behind-the-scenes troubleshooting as she begins to create another tutorial video. It’s hard work, with content creation for both Instagram and YouTube forever on her mind as she continues to work and progress successfully as a software engineer.

A woman showing off a game on a tablet — Estefannie Explains it All Raspberry Pi

As a thank you to her Instagram fans for helping her reach 10000 followers, Estefannie created a free game for Android and iOS called Gravitris — imagine Tetris with balance issues!

Estefannie was born and raised in Mexico, with ambitions to become a graphic designer and animator. However, a documentary on coding at Pixar, and the beauty of Merida’s hair in Brave, opened her mind to the opportunities of software engineering in animation. She altered her career path, moved to the United States, and switched to a Computer Science course.

A woman wearing safety goggles hugging a keyboard Estefannie Explains it All Raspberry Pi

With a constant desire to make and to learn, Estefannie combines her software engineering profession with her hobby to create fun, exciting content for YouTube.

While studying, Estefannie started a Computer Science Girls Club at the University of Houston, Texas, and she found herself eager to put more time and effort into the movement to increase the percentage of women in the industry. The club was a success, and still is to this day. While Estefannie has handed over the reins, she’s still very involved in the cause.

Through her YouTube videos, Estefannie continues the theme of inclusion, with every project offering a warm sense of approachability for all, regardless of age, gender, or skill. From exploring Scratch and Makey Makey with her young niece and nephew to creating her own Disney ‘Made with Magic’ backpack for a trip to Disney World, Florida, Estefannie’s videos are essentially a documentary of her own learning process, produced so viewers can learn with her — and learn from her mistakes — to create their own tech wonders.

Using the Raspberry Pi, she’s been able to broaden her skills and, in turn, her projects, creating a home-automated gingerbread house at Christmas, building a GPS-controlled GoPro for her trip to London, and making everyone’s life better with an Internet Button–controlled French press.

Estefannie Explains it All Raspberry Pi Home Automated Gingerbread House

Estefannie’s automated gingerbread house project was a labour of love, with electronics, wires, and candy strewn across both her living room and kitchen for weeks before completion. While she already was a skilled programmer, the world of physical digital making was still fairly new for Estefannie. Having ditched her hot glue gun in favour of a soldering iron in a previous video, she continued to experiment and try out new, interesting techniques that are now second nature to many members of the maker community. With the gingerbread house, Estefannie was able to research and apply techniques such as light controls, servos, and app making, although the latter was already firmly within her skill set. The result? A fun video of ups and downs that resulted in a wonderful, festive treat. She even gave her holiday home its own solar panel!

A DAY AT RASPBERRY PI TOWERS!! LINK IN BIO ⚡🎥 @raspberrypifoundation

1,910 Likes, 43 Comments – Estefannie Explains It All (@estefanniegg) on Instagram: “A DAY AT RASPBERRY PI TOWERS!! LINK IN BIO ⚡🎥 @raspberrypifoundation”

And that’s just the beginning of her adventures with Pi…but we won’t spoil her future plans by telling you what’s coming next. Sorry! However, since this article was written last year, Estefannie has released a few more Pi-based project videos, plus some awesome interviews and live-streams with other members of the maker community such as Simone Giertz. She even made us an awesome video for our Raspberry Pi YouTube channel! So be sure to check out her latest releases.

Best day yet!! I got to hangout, play Jenga with a huge arm robot, and have afternoon tea with @simonegiertz and robots!! 🤖👯 #shittyrobotnation

2,264 Likes, 56 Comments – Estefannie Explains It All (@estefanniegg) on Instagram: “Best day yet!! I got to hangout, play Jenga with a huge arm robot, and have afternoon tea with…”

While many wonderful maker videos show off a project without much explanation, or expect a certain level of skill from viewers hoping to recreate the project, Estefannie’s videos exist almost within their own category. We can’t wait to see where Estefannie Explains It All goes next!

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