Internet Research Task Force (IRTF) A. Langley Request for Comments: 7748 Google Category: Informational M. Hamburg ISSN: 2070-1721 Rambus Cryptography Research S. Turner sn3rd January 2016
Elliptic Curves for Security
Abstract
This memo specifies two elliptic curves over prime fields that offer a high level of practical security in cryptographic applications, including Transport Layer Security (TLS). These curves are intended to operate at the ~128-bit and ~224-bit security level, respectively, and are generated deterministically based on a list of required properties.
Status of This Memo
This document is not an Internet Standards Track specification; it is published for informational purposes.
This document is a product of the Internet Research Task Force (IRTF). The IRTF publishes the results of Internet-related research and development activities. These results might not be suitable for deployment. This RFC represents the consensus of the Crypto Forum Research Group of the Internet Research Task Force (IRTF). Documents approved for publication by the IRSG are not a candidate for any level of Internet Standard; see Section 2 of RFC 5741.
Information about the current status of this document, any errata, and how to provide feedback on it may be obtained at http://www.rfc-editor.org/info/rfc7748.
Copyright Notice
Copyright (c) 2016 IETF Trust and the persons identified as the document authors. All rights reserved.
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Since the initial standardization of Elliptic Curve Cryptography (ECC [RFC6090]) in [SEC1], there has been significant progress related to both efficiency and security of curves and implementations. Notable examples are algorithms protected against certain side-channel attacks, various "special" prime shapes that allow faster modular arithmetic, and a larger set of curve models from which to choose. There is also concern in the community regarding the generation and potential weaknesses of the curves defined by NIST [NIST].
This memo specifies two elliptic curves ("curve25519" and "curve448") that lend themselves to constant-time implementation and an exception-free scalar multiplication that is resistant to a wide range of side-channel attacks, including timing and cache attacks. They are Montgomery curves (where v^2 = u^3 + A*u^2 + u) and thus have birationally equivalent Edwards versions. Edwards curves support the fastest (currently known) complete formulas for the elliptic-curve group operations, specifically the Edwards curve x^2 + y^2 = 1 + d*x^2*y^2 for primes p when p = 3 mod 4, and the twisted Edwards curve -x^2 + y^2 = 1 + d*x^2*y^2 when p = 1 mod 4. The maps to/from the Montgomery curves to their (twisted) Edwards equivalents are also given.
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This memo also specifies how these curves can be used with the Diffie-Hellman protocol for key agreement.
The key words "MUST", "MUST NOT", "REQUIRED", "SHALL", "SHALL NOT", "SHOULD", "SHOULD NOT", "RECOMMENDED", "MAY", and "OPTIONAL" in this document are to be interpreted as described in RFC 2119 [RFC2119].
Throughout this document, the following notation is used:
p Denotes the prime number defining the underlying field.
GF(p) The finite field with p elements.
A An element in the finite field GF(p), not equal to -2 or 2.
d A non-zero element in the finite field GF(p), not equal to 1, in the case of an Edwards curve, or not equal to -1, in the case of a twisted Edwards curve.
order The order of the prime-order subgroup.
P A generator point defined over GF(p) of prime order.
U(P) The u-coordinate of the elliptic curve point P on a Montgomery curve.
V(P) The v-coordinate of the elliptic curve point P on a Montgomery curve.
X(P) The x-coordinate of the elliptic curve point P on a (twisted) Edwards curve.
Y(P) The y-coordinate of the elliptic curve point P on a (twisted) Edwards curve.
u, v Coordinates on a Montgomery curve.
x, y Coordinates on a (twisted) Edwards curve.
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For the ~128-bit security level, the prime 2^255 - 19 is recommended for performance on a wide range of architectures. Few primes of the form 2^c-s with s small exist between 2^250 and 2^521, and other choices of coefficient are not as competitive in performance. This prime is congruent to 1 mod 4, and the derivation procedure in Appendix A results in the following Montgomery curve v^2 = u^3 + A*u^2 + u, called "curve25519":
The Montgomery curve defined here is equal to the one defined in [curve25519], and the equivalent twisted Edwards curve is equal to the one defined in [ed25519].
For the ~224-bit security level, the prime 2^448 - 2^224 - 1 is recommended for performance on a wide range of architectures. This prime is congruent to 3 mod 4, and the derivation procedure in Appendix A results in the following Montgomery curve, called "curve448":
p 2^448 - 2^224 - 1
A 156326
order 2^446 - 0x8335dc163bb124b65129c96fde933d8d723a70aadc873d6d54a7bb0d
The "X25519" and "X448" functions perform scalar multiplication on the Montgomery form of the above curves. (This is used when implementing Diffie-Hellman.) The functions take a scalar and a u-coordinate as inputs and produce a u-coordinate as output. Although the functions work internally with integers, the inputs and outputs are 32-byte strings (for X25519) or 56-byte strings (for X448) and this specification defines their encoding.
The u-coordinates are elements of the underlying field GF(2^255 - 19) or GF(2^448 - 2^224 - 1) and are encoded as an array of bytes, u, in little-endian order such that u[0] + 256*u[1] + 256^2*u[2] + ... + 256^(n-1)*u[n-1] is congruent to the value modulo p and u[n-1] is minimal. When receiving such an array, implementations of X25519 (but not X448) MUST mask the most significant bit in the final byte. This is done to preserve compatibility with point formats that reserve the sign bit for use in other protocols and to increase resistance to implementation fingerprinting.
Implementations MUST accept non-canonical values and process them as if they had been reduced modulo the field prime. The non-canonical values are 2^255 - 19 through 2^255 - 1 for X25519 and 2^448 - 2^224 - 1 through 2^448 - 1 for X448.
The following functions implement this in Python, although the Python code is not intended to be performant nor side-channel free. Here, the "bits" parameter should be set to 255 for X25519 and 448 for X448:
<CODE BEGINS> def decodeLittleEndian(b, bits): return sum([b[i] << 8*i for i in range((bits+7)/8)])
def decodeUCoordinate(u, bits): u_list = [ord(b) for b in u] # Ignore any unused bits. if bits % 8: u_list[-1] &= (1<<(bits%8))-1 return decodeLittleEndian(u_list, bits)
def encodeUCoordinate(u, bits): u = u % p return ''.join([chr((u >> 8*i) & 0xff) for i in range((bits+7)/8)]) <CODE ENDS>
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Scalars are assumed to be randomly generated bytes. For X25519, in order to decode 32 random bytes as an integer scalar, set the three least significant bits of the first byte and the most significant bit of the last to zero, set the second most significant bit of the last byte to 1 and, finally, decode as little-endian. This means that the resulting integer is of the form 2^254 plus eight times a value between 0 and 2^251 - 1 (inclusive). Likewise, for X448, set the two least significant bits of the first byte to 0, and the most significant bit of the last byte to 1. This means that the resulting integer is of the form 2^447 plus four times a value between 0 and 2^445 - 1 (inclusive).
<CODE BEGINS> def decodeScalar25519(k): k_list = [ord(b) for b in k] k_list[0] &= 248 k_list[31] &= 127 k_list[31] |= 64 return decodeLittleEndian(k_list, 255)
def decodeScalar448(k): k_list = [ord(b) for b in k] k_list[0] &= 252 k_list[55] |= 128 return decodeLittleEndian(k_list, 448) <CODE ENDS>
To implement the X25519(k, u) and X448(k, u) functions (where k is the scalar and u is the u-coordinate), first decode k and u and then perform the following procedure, which is taken from [curve25519] and based on formulas from [montgomery]. All calculations are performed in GF(p), i.e., they are performed modulo p. The constant a24 is (486662 - 2) / 4 = 121665 for curve25519/X25519 and (156326 - 2) / 4 = 39081 for curve448/X448.
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x_1 = u x_2 = 1 z_2 = 0 x_3 = u z_3 = 1 swap = 0
For t = bits-1 down to 0: k_t = (k >> t) & 1 swap ^= k_t // Conditional swap; see text below. (x_2, x_3) = cswap(swap, x_2, x_3) (z_2, z_3) = cswap(swap, z_2, z_3) swap = k_t
A = x_2 + z_2 AA = A^2 B = x_2 - z_2 BB = B^2 E = AA - BB C = x_3 + z_3 D = x_3 - z_3 DA = D * A CB = C * B x_3 = (DA + CB)^2 z_3 = x_1 * (DA - CB)^2 x_2 = AA * BB z_2 = E * (AA + a24 * E)
X25519 and X448 are designed so that fast, constant-time implementations are easier to produce. The procedure above ensures that the same sequence of field operations is performed for all values of the secret key, thus eliminating a common source of side- channel leakage. However, this alone does not prevent all side- channels by itself. It is important that the pattern of memory accesses and jumps not depend on the values of any of the bits of k. It is also important that the arithmetic used not leak information about the integers modulo p, for example by having b*c be distinguishable from c*c. On some architectures, even primitive machine instructions, such as single-word division, can have variable timing based on their inputs.
Side-channel attacks are an active research area that still sees significant, new results. Implementors are advised to follow this research closely.
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Two types of tests are provided. The first is a pair of test vectors for each function that consist of expected outputs for the given inputs. The inputs are generally given as 64 or 112 hexadecimal digits that need to be decoded as 32 or 56 binary bytes before processing.
X25519:
Input scalar: a546e36bf0527c9d3b16154b82465edd62144c0ac1fc5a18506a2244ba449ac4 Input scalar as a number (base 10): 31029842492115040904895560451863089656 472772604678260265531221036453811406496 Input u-coordinate: e6db6867583030db3594c1a424b15f7c726624ec26b3353b10a903a6d0ab1c4c Input u-coordinate as a number (base 10): 34426434033919594451155107781188821651 316167215306631574996226621102155684838 Output u-coordinate: c3da55379de9c6908e94ea4df28d084f32eccf03491c71f754b4075577a28552
Input scalar: 4b66e9d4d1b4673c5ad22691957d6af5c11b6421e0ea01d42ca4169e7918ba0d Input scalar as a number (base 10): 35156891815674817266734212754503633747 128614016119564763269015315466259359304 Input u-coordinate: e5210f12786811d3f4b7959d0538ae2c31dbe7106fc03c3efc4cd549c715a493 Input u-coordinate as a number (base 10): 88838573511839298940907593866106493194 17338800022198945255395922347792736741 Output u-coordinate: 95cbde9476e8907d7aade45cb4b873f88b595a68799fa152e6f8f7647aac7957
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X448:
Input scalar: 3d262fddf9ec8e88495266fea19a34d28882acef045104d0d1aae121 700a779c984c24f8cdd78fbff44943eba368f54b29259a4f1c600ad3 Input scalar as a number (base 10): 599189175373896402783756016145213256157230856 085026129926891459468622403380588640249457727 683869421921443004045221642549886377526240828 Input u-coordinate: 06fce640fa3487bfda5f6cf2d5263f8aad88334cbd07437f020f08f9 814dc031ddbdc38c19c6da2583fa5429db94ada18aa7a7fb4ef8a086 Input u-coordinate as a number (base 10): 382239910814107330116229961234899377031416365 240571325148346555922438025162094455820962429 142971339584360034337310079791515452463053830 Output u-coordinate: ce3e4ff95a60dc6697da1db1d85e6afbdf79b50a2412d7546d5f239f e14fbaadeb445fc66a01b0779d98223961111e21766282f73dd96b6f
Input scalar: 203d494428b8399352665ddca42f9de8fef600908e0d461cb021f8c5 38345dd77c3e4806e25f46d3315c44e0a5b4371282dd2c8d5be3095f Input scalar as a number (base 10): 633254335906970592779259481534862372382525155 252028961056404001332122152890562527156973881 968934311400345568203929409663925541994577184 Input u-coordinate: 0fbcc2f993cd56d3305b0b7d9e55d4c1a8fb5dbb52f8e9a1e9b6201b 165d015894e56c4d3570bee52fe205e28a78b91cdfbde71ce8d157db Input u-coordinate as a number (base 10): 622761797758325444462922068431234180649590390 024811299761625153767228042600197997696167956 134770744996690267634159427999832340166786063 Output u-coordinate: 884a02576239ff7a2f2f63b2db6a9ff37047ac13568e1e30fe63c4a7 ad1b3ee3a5700df34321d62077e63633c575c1c954514e99da7c179d
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The second type of test vector consists of the result of calling the function in question a specified number of times. Initially, set k and u to be the following values:
For X25519: 0900000000000000000000000000000000000000000000000000000000000000 For X448: 05000000000000000000000000000000000000000000000000000000 00000000000000000000000000000000000000000000000000000000
For each iteration, set k to be the result of calling the function and u to be the old value of k. The final result is the value left in k.
X25519:
After one iteration: 422c8e7a6227d7bca1350b3e2bb7279f7897b87bb6854b783c60e80311ae3079 After 1,000 iterations: 684cf59ba83309552800ef566f2f4d3c1c3887c49360e3875f2eb94d99532c51 After 1,000,000 iterations: 7c3911e0ab2586fd864497297e575e6f3bc601c0883c30df5f4dd2d24f665424
X448:
After one iteration: 3f482c8a9f19b01e6c46ee9711d9dc14fd4bf67af30765c2ae2b846a 4d23a8cd0db897086239492caf350b51f833868b9bc2b3bca9cf4113 After 1,000 iterations: aa3b4749d55b9daf1e5b00288826c467274ce3ebbdd5c17b975e09d4 af6c67cf10d087202db88286e2b79fceea3ec353ef54faa26e219f38 After 1,000,000 iterations: 077f453681caca3693198420bbe515cae0002472519b3e67661a7e89 cab94695c8f4bcd66e61b9b9c946da8d524de3d69bd9d9d66b997e37
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The X25519 function can be used in an Elliptic Curve Diffie-Hellman (ECDH) protocol as follows:
Alice generates 32 random bytes in a[0] to a[31] and transmits K_A = X25519(a, 9) to Bob, where 9 is the u-coordinate of the base point and is encoded as a byte with value 9, followed by 31 zero bytes.
Bob similarly generates 32 random bytes in b[0] to b[31], computes K_B = X25519(b, 9), and transmits it to Alice.
Using their generated values and the received input, Alice computes X25519(a, K_B) and Bob computes X25519(b, K_A).
Both now share K = X25519(a, X25519(b, 9)) = X25519(b, X25519(a, 9)) as a shared secret. Both MAY check, without leaking extra information about the value of K, whether K is the all-zero value and abort if so (see below). Alice and Bob can then use a key-derivation function that includes K, K_A, and K_B to derive a symmetric key.
The check for the all-zero value results from the fact that the X25519 function produces that value if it operates on an input corresponding to a point with small order, where the order divides the cofactor of the curve (see Section 7). The check may be performed by ORing all the bytes together and checking whether the result is zero, as this eliminates standard side-channels in software implementations.
Test vector:
Alice's private key, a: 77076d0a7318a57d3c16c17251b26645df4c2f87ebc0992ab177fba51db92c2a Alice's public key, X25519(a, 9): 8520f0098930a754748b7ddcb43ef75a0dbf3a0d26381af4eba4a98eaa9b4e6a Bob's private key, b: 5dab087e624a8a4b79e17f8b83800ee66f3bb1292618b6fd1c2f8b27ff88e0eb Bob's public key, X25519(b, 9): de9edb7d7b7dc1b4d35b61c2ece435373f8343c85b78674dadfc7e146f882b4f Their shared secret, K: 4a5d9d5ba4ce2de1728e3bf480350f25e07e21c947d19e3376f09b3c1e161742
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The X448 function can be used in an ECDH protocol very much like the X25519 function.
If X448 is to be used, the only differences are that Alice and Bob generate 56 random bytes (not 32) and calculate K_A = X448(a, 5) or K_B = X448(b, 5), where 5 is the u-coordinate of the base point and is encoded as a byte with value 5, followed by 55 zero bytes.
As with X25519, both sides MAY check, without leaking extra information about the value of K, whether the resulting shared K is the all-zero value and abort if so.
The security level (i.e., the number of "operations" needed for a brute-force attack on a primitive) of curve25519 is slightly under the standard 128-bit level. This is acceptable because the standard security levels are primarily driven by much simpler, symmetric primitives where the security level naturally falls on a power of two. For asymmetric primitives, rigidly adhering to a power-of-two security level would require compromises in other parts of the design, which we reject. Additionally, comparing security levels between types of primitives can be misleading under common threat models where multiple targets can be attacked concurrently [bruteforce].
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The ~224-bit security level of curve448 is a trade-off between performance and paranoia. Large quantum computers, if ever created, will break both curve25519 and curve448, and reasonable projections of the abilities of classical computers conclude that curve25519 is perfectly safe. However, some designs have relaxed performance requirements and wish to hedge against some amount of analytical advance against elliptic curves and thus curve448 is also provided.
Protocol designers using Diffie-Hellman over the curves defined in this document must not assume "contributory behaviour". Specially, contributory behaviour means that both parties' private keys contribute to the resulting shared key. Since curve25519 and curve448 have cofactors of 8 and 4 (respectively), an input point of small order will eliminate any contribution from the other party's private key. This situation can be detected by checking for the all- zero output, which implementations MAY do, as specified in Section 6. However, a large number of existing implementations do not do this.
Designers using these curves should be aware that for each public key, there are several publicly computable public keys that are equivalent to it, i.e., they produce the same shared secrets. Thus using a public key as an identifier and knowledge of a shared secret as proof of ownership (without including the public keys in the key derivation) might lead to subtle vulnerabilities.
Designers should also be aware that implementations of these curves might not use the Montgomery ladder as specified in this document, but could use generic, elliptic-curve libraries instead. These implementations could reject points on the twist and could reject non-minimal field elements. While not recommended, such implementations will interoperate with the Montgomery ladder specified here but may be trivially distinguishable from it. For example, sending a non-canonical value or a point on the twist may cause such implementations to produce an observable error while an implementation that follows the design in this text would successfully produce a shared key.
[brainpool] ECC Brainpool, "ECC Brainpool Standard Curves and Curve Generation", October 2005, <http://www.ecc-brainpool.org/download/ Domain-parameters.pdf>.
[montgomery] Montgomery, P., "Speeding the Pollard and Elliptic Curve Methods of Factorization", January 1987, <http://www.ams.org/journals/mcom/1987-48-177/ S0025-5718-1987-0866113-7/S0025-5718-1987-0866113-7.pdf>.
[reducing] Menezes, A., Okamoto, T., and S. Vanstone, "Reducing elliptic curve logarithms to logarithms in a finite field", DOI 10.1109/18.259647, 1993, <http://ieeexplore.ieee.org/xpl/ articleDetails.jsp?arnumber=259647>.
[semaev] Semaev, I., "Evaluation of discrete logarithms on some elliptic curves", 1998, <http://www.ams.org/journals/ mcom/1998-67-221/S0025-5718-98-00887-4/ S0025-5718-98-00887-4.pdf>.
This section specifies the procedure that was used to generate the above curves; specifically, it defines how to generate the parameter A of the Montgomery curve y^2 = x^3 + A*x^2 + x. This procedure is intended to be as objective as can reasonably be achieved so that it's clear that no untoward considerations influenced the choice of curve. The input to this process is p, the prime that defines the underlying field. The size of p determines the amount of work needed to compute a discrete logarithm in the elliptic curve group, and choosing a precise p depends on many implementation concerns. The performance of the curve will be dominated by operations in GF(p), so carefully choosing a value that allows for easy reductions on the intended architecture is critical. This document does not attempt to articulate all these considerations.
The value (A-2)/4 is used in several of the elliptic curve point arithmetic formulas. For simplicity and performance reasons, it is beneficial to make this constant small, i.e., to choose A so that (A-2) is a small integer that is divisible by four.
For each curve at a specific security level:
1. The trace of Frobenius MUST NOT be in {0, 1} in order to rule out the attacks described in [smart], [satoh], and [semaev], as in [brainpool] and [safecurves].
2. MOV Degree [reducing]: the embedding degree MUST be greater than (order - 1) / 100, as in [brainpool] and [safecurves].
3. CM Discriminant: discriminant D MUST be greater than 2^100, as in [safecurves].
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For primes congruent to 1 mod 4, the minimal cofactors of the curve and its twist are either {4, 8} or {8, 4}. We choose a curve with the latter cofactors so that any algorithms that take the cofactor into account don't have to worry about checking for points on the twist, because the twist cofactor will be the smaller of the two.
To generate the Montgomery curve, we find the minimal, positive A value such that A > 2 and (A-2) is divisible by four and where the cofactors are as desired. The find1Mod4 function in the following Sage script returns this value given p:
<CODE BEGINS> def findCurve(prime, curveCofactor, twistCofactor): F = GF(prime)
for A in xrange(3, int(1e9)): if (A-2) % 4 != 0: continue
try: E = EllipticCurve(F, [0, A, 0, 1, 0]) except: continue
if (groupOrder % curveCofactor == 0 and is_prime(groupOrder // curveCofactor) and twistOrder % twistCofactor == 0 and is_prime(twistOrder // twistCofactor)): return A
For a prime congruent to 3 mod 4, both the curve and twist cofactors can be 4, and this is minimal. Thus, we choose the curve with these cofactors and minimal, positive A such that A > 2 and (A-2) is divisible by four. The find3Mod4 function in the following Sage script returns this value given p:
The base point for a curve is the point with minimal, positive u value that is in the correct subgroup. The findBasepoint function in the following Sage script returns this value given p and A:
<CODE BEGINS> def findBasepoint(prime, A): F = GF(prime) E = EllipticCurve(F, [0, A, 0, 1, 0])
for uInt in range(1, 1e3): u = F(uInt) v2 = u^3 + A*u^2 + u if not v2.is_square(): continue v = v2.sqrt()
point = E(u, v) pointOrder = point.order() if pointOrder > 8 and pointOrder.is_prime(): return point <CODE ENDS>
Generating the base point
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Acknowledgements
This document is the result of a combination of draft-black-rpgecc-01 and draft-turner-thecurve25519function-01. The following authors of those documents wrote much of the text and figures but are not listed as authors on this document: Benjamin Black, Joppe W. Bos, Craig Costello, Patrick Longa, Michael Naehrig, Watson Ladd, and Rich Salz.
The authors would also like to thank Tanja Lange, Rene Struik, Rich Salz, Ilari Liusvaara, Deirdre Connolly, Simon Josefsson, Stephen Farrell, Georg Nestmann, Trevor Perrin, and John Mattsson for their reviews and contributions.
The X25519 function was developed by Daniel J. Bernstein in [curve25519].
Authors' Addresses
Adam Langley Google 345 Spear Street San Francisco, CA 94105 United States
Email: agl@google.com
Mike Hamburg Rambus Cryptography Research 425 Market Street, 11th Floor San Francisco, CA 94105 United States