• Lawrence Cummins

Mathematical Foundations of the Bitcoin Protocol.

Updated: Jan 4

BLGI Chronicle’s

OTC: BLGI


One reason bitcoin can be confusing for beginners is that the technology behind it redefines the concept of ownership.

To own something in the traditional sense, be it a house or a sum of money, means either having personal custody of the thing or granting custody to a trusted entity such as a bank.

With bitcoin, the case is different. Bitcoins themselves are not stored either centrally or locally, and so no one entity is their custodian.

They exist as records on a distributed ledger called the blockchain, copies of which are shared by a volunteer network of connected computers. To "own" a bitcoin simply means having the ability to transfer control of it to someone else by creating a record of the transfer in the blockchain. What grants this ability?

Access to an ECDSA private and public key pair. What does that mean, and how does that secure bitcoin?

ECDSA is short for Elliptic Curve Digital Signature Algorithm. It is a process that uses an elliptic curve and a finite field to "sign" data in such a way that third parties can verify the authenticity of the signature while the signer retains the exclusive ability to create the signature. With bitcoin, the data that is signed is the transaction that transfers ownership.

ECDSA has separate procedures for signing and verification. Each procedure is an algorithm composed of a few arithmetic operations. The signing algorithm uses the private key, and the verification process uses the public key. We will show an example of this later.

But first, a crash course on elliptic curves and finite fields.

Elliptic curves

An elliptic curve is represented algebraically as an equation of the form:

y2 = x3 + ax + b

For a = 0 and b = 7

(the version used by bitcoin), it looks like this:

Elliptic curves have useful properties. For example, a non-vertical line intersecting two non-tangent points on the curve will always intersect a third point on the curve. A further property is that a non-vertical line tangent to the curve at one point will intersect precisely one other point on the curve.


We can use these properties to define two operations: point addition and point doubling.

Point addition, P + Q = R, is defined as the reflection through the x-axis of the third intersecting point R' on a line that includes P and Q. It is easiest to understand this using a diagram:



Similarly, point doubling, P + P = R is defined by finding the line tangent to the point to be doubled, P, and taking reflection through the x-axis of the intersecting point R' on the curve to get R.


Here’s an example of what that would look like:


Here is an example,together, these two operations are used for scalar multiplication, R = a P, defined by adding the point P to itself.

For example:

R = 7P R = P + (P + (P + (P + (P + (P + P)))))

The process of scalar multiplication is normally simplified by using a combination of point addition and point doubling operations.

For example:

R = 7P R = P + 6P R = P + 2 (3P) R = P + 2 (P + 2P)

Here, 7P has broken down into two-point doubling steps and two-point addition steps.

Finite fields

In the context of ECDSA, a finite field can be thought of as a predefined range of positive numbers within which every calculation must fall. Any number outside this range "wraps around" to fall within the range. The simplest way to think about this is by calculating the remainders, as represented by the modulus (mod) operator.

For example,

9/7 gives 1 with a remainder of 2:

9 mod 7 = 2


Here our finite field is modules 7, and all mod operations over this field yield a result falling within a range from 0 to 6.

Putting it together, ECDSA uses elliptic curves in the context of a finite field, which significantly their appearance but not their underlying equations or unique properties. The same equation plotted above, in a finite field of modulo 67, looks like this:


It is now a set of points, in which all the x and y values are integers between 0 and 66. Note that the "curve" still retains its horizontal symmetry.

Point addition and doubling are now slightly different visually. Lines drawn on this graph will wrap around the horizontal and vertical directions, just like in a game of Asteroids, maintaining the same slope. So adding points (2, 22) and (6, 25) looks like this:



The third intersecting point is (47, 39), and its reflection point is (47, 28).

A protocol such as bitcoin selects a set of parameters for the elliptic curve and its finite field representation fixed for all users of the protocol. The parameters include the equation used, the prime modulo of the field, and a base point that falls on the curve.

The order of the base point, which is not independently selected but is a function of the other parameters, can be thought of graphically as the number of times the point can be added to itself until its slope is infinite, or a vertical line. The base point is selected such that the order is a large prime number.

Bitcoin uses exceptionally large numbers for its base point, prime modulo, and order. All practical applications of ECDSA use enormous values. The security of the algorithm relies on these values being large and impractical to brute force or reverse engineer.

In the case of bitcoin:

Elliptic curve equation: y2 = x3 + 7

Prime modulo = 2256 – 232 – 29 – 28 – 27 – 26 – 24 - 1 = FFFFFFFF FFFFFFFF FFFFFFFF FFFFFFFF FFFFFFFF FFFFFFFF FFFFFFFE FFFFFC2F

Base point = 04 79BE667E F9DCBBAC 55A06295 CE870B07 029BFCDB 2DCE28D9 59F2815B 16F81798 483ADA77 26A3C465 5DA4FBFC 0E1108A8 FD17B448 A6855419 9C47D08F FB10D4B8

Order = FFFFFFFF FFFFFFFF FFFFFFFF FFFFFFFE BAAEDCE6 AF48A03B BFD25E8C D0364141

Who chose these numbers, and why? A great deal of research and a fair amount of intrigue surrounds the selection of appropriate parameters. A large, seemingly random number could hide a backdoor method of reconstructing the private key. In brief, this particular realization goes by the name of secp256k1 and is part of a family of elliptic curve solutions over finite fields proposed for use in cryptography.

Private keys and public keys

With these formalities out of the way, we can understand private and public keys and how they are related. Here it is in a nutshell: In ECDSA, the private key is an unpredictably chosen number between 1 and the order. The public key is derived from the private key by scalar multiplication of the base point a number of times equal to the private key's value.

Expressed as an equation:

public-key = private key * base point

This shows that the maximum possible number of private keys (and thus bitcoin addresses) is equal to the order.


In a continuous field we could plot the tangent line and pinpoint the public key on the graph, but there are some equations that accomplish the same thing in the context of finite fields. Point addition of p + q to find r is defined component-wise as follows:

c = (qy - py) / (qx - px) rx = c2 - px - qx ry = c (px - rx) - py


And point doubling of p to find r is as follows:

c = (3px2 + a) / 2py rx = c2 - 2px ry = c (px - rx) - py


In practice, the computation of the public key is broken down into several points. Doubling and point addition operations starting from the base point.


Using small numbers to get an intuition about how the keys are constructed and used in signing and verifying. The parameters we will use are:

Equation: y2 = x3 + 7 (which is to say, a = 0 and b = 7) Prime Modulo: 67 Base Point: (2, 22) Order: 79 Private key: 2


First, let us find the public key. Since we have selected the simplest possible private key with value = 2, it will require only a single point doubling operation from the base point. The calculation looks like this:


c = (3 * 22 + 0) / (2 * 22) mod 67 c = (3 * 4) / (44) mod 67 c = 12 / 44 mod 67

Here we have to pause for a bit of sleight-of-hand: how do we perform division in a finite field, where the result must always be an integer? We have to multiply by the inverse, which space does not permit us to define here (we refer you to here and here if interested).


In the case at hand, you will have to trust us for the moment that: 44-1 = 32

Moving right along:

c = 12 * 32 mod 67 c = 384 mod 67 c = 49

rx = (492 - 2 * 2) mod 67 rx = (2401 - 4) mod 67 rx = 2397 mod 67 rx = 52

ry = (49 * (2 - 52) - 22) mod 67 ry = (49 * (-50) - 22) mod 67 ry = (-2450 - 22) mod 67 ry = -2472 mod 67 ry = 7

Our public key thus corresponds to the point (52, 7). All that work for a private key of 2!

This operation - going from private to public key - is computationally smooth compared to trying to work backward to deduce the private key from the public key, which, while theoretically possible, is computationally infeasible due to the large parameters used in actual elliptic cryptography.

Therefore, going from the private key to the public key is, by design, a one-way trip.

As with the private key, the public key generally represented by a hexadecimal string. How do we get from a point on a plane, described by two numbers, to a single number? In an uncompressed public key, the two 256-bit numbers representing the x and y coordinates are stuck together in one long string.

We can also take advantage of the elliptic curve's symmetry to produce a compressed public key by keeping the x value and noting which half of the curve the point is on. From this incomplete information, we can recover both coordinates.

Signing data with the private key

Now that we have a private and public key pair let us sign some data!

The data can be of any length. The usual first step is to hash the data to generate a number containing the same number of bits (256) as the order of the curve. Here, we will skip the hashing step for the sake of simplicity and just sign the raw data z. We will call G the base point, n the order, and d the private key.

The recipe for signing is as follows:

  1. Choose some integer k between 1 and n - 1.

  2. Calculate the point (x, y) = k * G, using scalar multiplication.

  3. Find r = x mod n. If r = 0, return to step 1.

  4. Find s = (z + r * d) / k mod n. If s = 0, return to step 1.

  5. The signature is the pair (r, s)

As a reminder, in step 4, if the numbers result in a fraction (which in real life, they almost always will). The numerator should be multiplied by the inverse of the denominator. In step 1, it is essential that the knot is repeated in different signatures and not be guessable by a third party. That is, k should either be random or generated by deterministic means that are kept secret from third parties. Otherwise, it would be possible to extract the private key from step 4, since s, z, r, k, and n are all known.

Let’s pick our data to be the number 17, and follow the recipe. Our variables:

z = 17 (data) n = 79 (order) G = (2, 22) (base point) d = 2 (private key)

  1. Pick a random number:

k = rand(1, n - 1) k = rand(1, 79 - 1) k = 3 (is this really random? OK you got us, but it will make our example simpler!)

  1. Calculate the point. This is done in the same manner as determining the public key, but for brevity, let us omit the arithmetic for point addition and point doubling.

(x, y) = 3G (x, y) = G + 2G (x, y) = (2, 22) + (52, 7) (x, y) = (62, 63) x = 62 y = 63

  1. Find r:

r = x mod n r = 62 mod 79 r = 62

  1. Find s:

s = (z + r * d) / k mod n s = (17 + 62 * 2) / 3 mod 79 s = (17 + 124) / 3 mod 79 s = 141 / 3 mod 79 s = 47 mod 79 s = 47

Note that above we were able to divide by 3 since the result was an integer. In real-life cases, we would use the inverse of k (like before, we have hidden some gory details by computing it elsewhere):

s = (z + r * d) / k mod n s = (17 + 62 * 2) / 3 mod 79 s = (17 + 124) / 3 mod 79 s = 141 / 3 mod 79 s = 141 * 3-1 mod 79 s = 141 * 53 mod 79 s = 7473 mod 79 s = 47

  1. Our signature is the pair (r, s) = (62, 47).

As with the private and public keys, this signature is typically represented by a hexadecimal string.

Verifying the signature with the public key

We now have some data and a signature for that data. A third party who has our public key can receive our data and signature and verify that we are the senders. Let us see how this works.

With Q being the public key and the other variables defined as before, verifying a signature is as follows:

  1. Verify that r and s are between 1 and n - 1.

  2. Calculate w = s-1 mod n

  3. Calculate u = z * w mod n

  4. Calculate v = r * w mod n

  5. Calculate the point (x, y) = uG + vQ

  6. Verify that r = x mod n. The signature is invalid if it is not.

Why do these steps work? We are skipping the proof, but you can read the details here.

Our variables, once again:

z = 17 (data) (r, s) = (62, 47) (signature) n = 79 (order) G = (2, 22) (base point) Q = (52, 7) (public key)

  1. Verify that r and s are between 1 and n - 1. Check and check.

r: 1 <= 62 < 79 s: 1 <= 47 < 79

  1. Calculate w:

w = s-1 mod n w = 47-1 mod 79 w = 37

  1. Calculate

u = zw mod n u = 17 * 37 mod 79 u = 629 mod 79 u = 76

  1. Calculate v:

v = rw mod n v = 62 * 37 mod 79 v = 2294 mod 79 v = 3

  1. Calculate the point (x, y):

(x, y) = uG + vQ


Break down the point doubling and addition in uG and vQ separately.

uG = 76G uG = 2(38G) uG = 2( 2(19G) ) uG = 2( 2(G + 18G) ) uG = 2( 2(G + 2(9G) ) ) uG = 2( 2(G + 2(G + 8G) ) ) uG = 2( 2(G + 2(G + 2(4G) ) ) ) uG = 2( 2(G + 2(G + 2( 2(2G) ) ) ) )

Sit back for a moment to appreciate that by using the grouping trick we reduce 75 successive addition operations to just six operations of point doubling and two operations of point addition. These tricks will come in handy when the numbers get really large.


Working our way from the inside out:

uG = 2( 2(G + 2(G + 2( 2( 2(2, 22) ) ) ) ) ) uG = 2( 2(G + 2(G + 2( 2(52, 7) ) ) ) ) uG = 2( 2(G + 2(G + 2(25, 17) ) ) ) uG = 2( 2(G + 2( (2, 22) + (21, 42) ) ) ) uG = 2( 2(G + 2(13, 44) ) ) uG = 2( 2( (2, 22) + (66, 26) ) ) uG = 2( 2(38, 26) ) uG = 2(27, 40) uG = (62, 4)


And now for vQ:

vQ = 3Q vQ = Q + 2Q vQ = Q + 2(52, 7) vQ = (52, 7) + (25, 17) vQ = (11, 20)


Putting them together:

(x, y) = uG + vQ (x, y) = (62, 4) + (11, 20) (x, y) = (62, 63)

Step 5 is the bulk of the work. For the final step,

  1. Verify that r = x mod n

r = x mod n 62 = 62 mod 79 62 = 62


Our signature is valid!

Conclusion

We have developed some intuition about the deep mathematical relationship that exists between public and private keys.

We have seen how even in the most straightforward examples, the math behind signatures and verification quickly gets complicated, and we can appreciate the enormous complexity which must be involved when the parameters involved are 256-bit numbers.

We have seen how the intelligent application of the most straightforward mathematical procedures can create the one-way "trapdoor" functions necessary to preserve the information asymmetry, which defines ownership of a bitcoin.

With newfound confidence in the robustness of the system, provided that we carefully safeguard the knowledge of our private keys.

In other words, therefore, it is commonly said that bitcoin is "backed by math."

Eric Rykwalder & Lawrence Cummins

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