Internet Research Task Force (IRTF) D. Harkins, Ed.
Request for Comments: 7664 Aruba Networks
Category: Informational November 2015
ISSN: 20701721
Dragonfly Key Exchange
Abstract
This document specifies a key exchange using discrete logarithm
cryptography that is authenticated using a password or passphrase.
It is resistant to active attack, passive attack, and offline
dictionary attack. This document is a product of the Crypto Forum
Research Group (CFRG).
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 Internetrelated research
and development activities. These results might not be suitable for
deployment. This RFC represents the individual opinion(s) of one or
more members 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.rfceditor.org/info/rfc7664.
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Copyright (c) 2015 IETF Trust and the persons identified as the
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Table of Contents
1. Introduction . . . . . . . . . . . . . . . . . . . . . . . . 2
1.1. Requirements Language . . . . . . . . . . . . . . . . . . 2
1.2. Definitions . . . . . . . . . . . . . . . . . . . . . . . 3
1.2.1. Notations . . . . . . . . . . . . . . . . . . . . . . 3
1.2.2. Resistance to Dictionary Attack . . . . . . . . . . . 3
2. Discrete Logarithm Cryptography . . . . . . . . . . . . . . . 4
2.1. Elliptic Curve Cryptography . . . . . . . . . . . . . . . 4
2.2. Finite Field Cryptography . . . . . . . . . . . . . . . . 5
3. The Dragonfly Key Exchange . . . . . . . . . . . . . . . . . 6
3.1. Assumptions . . . . . . . . . . . . . . . . . . . . . . . 7
3.2. Derivation of the Password Element . . . . . . . . . . . 8
3.2.1. Hunting and Pecking with ECC Groups . . . . . . . . . 10
3.2.2. Hunting and Pecking with MODP Groups . . . . . . . . 12
3.3. The Commit Exchange . . . . . . . . . . . . . . . . . . . 13
3.4. The Confirm Exchange . . . . . . . . . . . . . . . . . . 14
4. Security Considerations . . . . . . . . . . . . . . . . . . . 15
5. References . . . . . . . . . . . . . . . . . . . . . . . . . 16
5.1. Normative References . . . . . . . . . . . . . . . . . . 16
5.2. Informative References . . . . . . . . . . . . . . . . . 16
Acknowledgements . . . . . . . . . . . . . . . . . . . . . . . . 18
Author's Address . . . . . . . . . . . . . . . . . . . . . . . . 18
1. Introduction
Passwords and passphrases are the predominant way of doing
authentication in the Internet today. Many protocols that use
passwords and passphrases for authentication exchange password
derived data as a proofofknowledge of the password (for example,
[RFC7296] and [RFC5433]). This opens the exchange up to an offline
dictionary attack where the attacker gleans enough knowledge from
either an active or passive attack on the protocol to run through a
pool of potential passwords and compute verifiers until it is able to
match the passwordderived data.
This protocol employs discrete logarithm cryptography to perform an
efficient exchange in a way that performs mutual authentication using
a password that is provably resistant to an offline dictionary
attack. Consensus of the CFRG for this document was rough.
1.1. Requirements Language
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].
1.2. Definitions
1.2.1. Notations
The following notations are used in this memo.
password
A shared, secret, and potentially lowentropy word, phrase, code,
or key used as a credential to mutually authenticate the peers.
It is not restricted to characters in a human language.
a  b
denotes concatenation of bit string "a" with bit string "b".
len(a)
indicates the length in bits of the bit string "a".
lsb(a)
returns the leastsignificant bit of the bit string "a".
lgr(a,b)
takes "a" and a prime, "b", and returns the Legendre symbol (a/b).
min(a,b)
returns the lexicographical minimum of strings "a" and "b", or
zero (0) if "a" equals "b".
max(a,b)
returns the lexicographical maximum of strings "a" and "b", or
zero (0) if "a" equals "b".
The convention for this memo is to represent an element in a finite
cyclic group with an uppercase letter or acronym, while a scalar is
indicated with a lowercase letter or acronym. An element that
represents a point on an elliptic curve has an implied composite
nature  i.e., it has both an x and ycoordinate.
1.2.2. Resistance to Dictionary Attack
Resistance to dictionary attack means that any advantage an adversary
can gain must be directly related to the number of interactions she
makes with an honest protocol participant and not through
computation. The adversary will not be able to obtain any
information about the password except whether a single guess from a
protocol run is correct or incorrect.
2. Discrete Logarithm Cryptography
Dragonfly uses discrete logarithm cryptography to achieve
authentication and key agreement (see [SP80056A]). Each party to
the exchange derives ephemeral keys with respect to a particular set
of domain parameters (referred to here as a "group"). A group can be
based on Finite Field Cryptography (FFC) or Elliptic Curve
Cryptography (ECC).
Three operations are defined for both types of groups:
o "scalar operation"  takes a scalar and an element in the group
to produce another element  Z = scalarop(x, Y).
o "element operation"  takes two elements in the group to produce
a third  Z = elementop(X, Y).
o "inverse operation"  takes an element and returns another
element such that the element operation on the two produces the
identity element of the group  Y = inverse(X).
2.1. Elliptic Curve Cryptography
Domain parameters for the ECC groups used by Dragonfly are:
o A prime, p, determining a prime field GF(p). The cryptographic
group will be a subgroup of the full elliptic curve group that
consists of points on an elliptic curve  elements from GF(p)
that satisfy the curve's equation  together with the "point at
infinity" that serves as the identity element. The group
operation for ECC groups is addition of points on the elliptic
curve.
o Elements a and b from GF(p) that define the curve's equation. The
point (x, y) in GF(p) x GF(p) is on the elliptic curve if and only
if (y^2  x^3  a*x  b) mod p equals zero (0).
o A point, G, on the elliptic curve, which serves as a generator for
the ECC group. G is chosen such that its order, with respect to
elliptic curve addition, is a sufficiently large prime.
o A prime, q, which is the order of G, and thus is also the size of
the cryptographic subgroup that is generated by G.
An (x,y) pair is a valid ECC element if: 1) the x and ycoordinates
are both greater than zero (0) and less than the prime defining the
underlying field; and, 2) the x and ycoordinates satisfy the
equation for the curve and produce a valid point on the curve that is
not the point at infinity. If either one of those conditions do not
hold, the (x,y) pair is not a valid element.
The scalar operation is addition of a point on the curve with itself
a number of times. The point Y is multiplied x times to produce
another point Z:
Z = scalarop(x, Y) = x*Y
The element operation is addition of two points on the curve. Points
X and Y are summed to produce another point Z:
Z = elementop(X, Y) = X + Y
The inverse function is defined such that the sum of an element and
its inverse is "0", the point at infinity of an elliptic curve group:
R + inverse(R) = "0"
Elliptic curve groups require a mapping function, q = F(Q), to
convert a group element to an integer. The mapping function used in
this memo returns the xcoordinate of the point it is passed.
scalarop(x, Y) can be viewed as x iterations of elementop() by
defining:
Y = scalarop(1, Y)
Y = scalarop(x, Y) = elementop(Y, scalarop(x1, Y)), for x > 1
A definition of how to add two points on an elliptic curve (i.e.,
elementop(X, Y)) can be found in [RFC6090].
Note: There is another elliptic curve domain parameter, a cofactor,
h, that is defined by the requirement that the size of the full
elliptic curve group (including "0") be the product of h and q.
Elliptic curve groups used with Dragonfly authentication MUST have a
cofactor of one (1).
2.2. Finite Field Cryptography
Domain parameters for the FFC groups used in Dragonfly are:
o A prime, p, determining a prime field GF(p), the integers modulo
p. The FFC group will be a subgroup of GF(p)*, the multiplicative
group of nonzero elements in GF(p). The group operation for FFC
groups is multiplication modulo p.
o An element, G, in GF(p)* which serves as a generator for the FFC
group. G is chosen such that its multiplicative order is a
sufficiently large prime divisor of ((p1)/2).
o A prime, q, which is the multiplicative order of G, and thus also
the size of the cryptographic subgroup of GF(p)* that is generated
by G.
A number is a valid element in an FFC group if: 1) it is between one
(1) and one (1) less than the prime, p, exclusive (i.e., 1 < element
< p1); and, 2) if modular exponentiation of the element by the group
order, q, equals one (1). If either one of those conditions do not
hold, the number is not a valid element.
The scalar operation is exponentiation of a generator modulo a prime.
An element Y is taken to the xth power modulo the prime returning
another element, Z:
Z = scalarop(x, Y) = Y^x mod p
The element operation is modular multiplication. Two elements, X and
Y, are multiplied modulo the prime returning another element, Z:
Z = elementop(X, Y) = (X * Y) mod p
The inverse function for a MODP group is defined such that the
product of an element and its inverse modulo the group prime equals
one (1). In other words,
(R * inverse(R)) mod p = 1
3. The Dragonfly Key Exchange
There are two parties to the Dragonfly exchange named, for
convenience and by convention, Alice and Bob. The two parties have a
shared password that was established in an outofband mechanism, and
they both agree to use a particular domain parameter set (either ECC
or FFC). In the Dragonfly exchange, both Alice and Bob share an
identical view of the shared password  i.e., it is not "augmented",
where one side holds a password and the other side holds a non
invertible verifier. This allows Dragonfly to be used in traditional
clientserver protocols and also in peertopeer applications in
which there are not fixed roles and either party may initiate the
exchange (and both parties may implement it simultaneously).
Prior to beginning the Dragonfly exchange, the two peers MUST derive
a secret element in the chosen domain parameter set. Two "hunting
andpecking" techniques to determine a secret element, one for ECC
and one for FFC, are described in Section 3.2, but any secure,
deterministic method that is agreed upon can be used. For instance,
the technique described in [hash2ec] can be used for ECC groups.
The Dragonfly exchange consists of two message exchanges, a "Commit
Exchange" in which both sides commit to a single guess of the
password, and a "Confirm Exchange" in which both sides confirm
knowledge of the password. A side effect of running the Dragonfly
exchange is an authenticated, shared, and secret key whose
cryptographic strength is set by the agreedupon group.
Dragonfly uses a random function, H(), a mapping function, F(), and a
key derivation function, KDF().
3.1. Assumptions
In order to avoid attacks on the Dragonfly protocol, some basic
assumptions are made:
1. Function H is a "random oracle" (see [RANDOR]) that maps a binary
string of indeterminate length onto a fixed binary string that is
x bits in length.
H: {0,1}^* > {0,1}^x
2. Function F is a mapping function that takes an element in a group
and returns an integer. For ECC groups, function F() returns the
xcoordinate of the element (which is a point on the elliptic
curve); for FFC groups, function F() is the identity function
(since all elements in an FFC group are already integers less
than the prime).
ECC: x = F(P), where P=(x,y)
FFC: x = F(x)
3. Function KDF is a key derivation function (see, for instance,
[SP800108]) that takes a key to stretch, k, a label to bind to
the key, label, and an indication of the desired output, n:
stretch = KDFn(k, label)
so that len(stretch) equals n.
4. The discrete logarithm problem for the chosen group is hard.
That is, given G, P, and Y = G^x mod p, it is computationally
infeasible to determine x. Similarly, for an ECC group given the
curve definition, a generator G, and Y = x * G, it is
computationally infeasible to determine x.
5. There exists a pool of passwords from which the password shared
by the two peers is drawn. This pool can consist of words from a
dictionary, for example. Each password in this pool has an equal
probability of being the shared password. All potential
attackers have access to this pool of passwords.
6. The peers have the ability to produce quality random numbers.
3.2. Derivation of the Password Element
Prior to beginning the exchange of information, the peers MUST derive
a secret element, called the Password Element (PE), in the group
defined by the chosen domain parameter set. From the point of view
of an attacker who does not know the password, the PE will be a
random element in the negotiated group. Two examples are described
here for completeness, but any method of deterministically mapping a
secret string into an element in a selected group can be used  for
instance, the technique in [hash2ec] for ECC groups. If a different
technique than the ones described here is used, the secret string
SHOULD include the identities of the peers.
To fix the PE, both peers MUST have a common view of the password.
If there is any password processing necessary (for example, to
support internationalization), the processed password is then used as
the shared credential. If either side wants to store a hashed
version of the password (hashing the password with random data called
a "salt"), it will be necessary to convey the salt to the other side
prior to commencing the exchange, and the hashed password is then
used as the shared credential.
Note: Only one party would be able to maintain a salted password, and
this would require that the Dragonfly key exchange be used in a
protocol that has strict roles for client (that always initiates) and
server (that always responds). Due to the symmetric nature of
Dragonfly, salting passwords does not prevent an impersonation attack
after compromise of a database of salted passwords.
The deterministic process to select the PE begins with choosing a
secret seed and then performing a groupspecific huntingandpecking
technique  one for FFC groups and another for ECC groups.
To thwart sidechannel attacks that attempt to determine the number
of iterations of the huntingandpecking loop used to find the PE for
a given password, a security parameter, k, is used that ensures that
at least k iterations are always performed. The probability that one
requires more than n iterations of the huntingandpecking loop to
find an ECC PE is roughly (q/2p)^n and to find an FFC PE is roughly
(q/p)^n, both of which rapidly approach zero (0) as n increases. The
security parameter, k, SHOULD be set sufficiently large such that the
probability that finding the PE would take more than k iterations is
sufficiently small (see Section 4).
First, an 8bit counter is set to one (1), and a secret base is
computed using the negotiated oneway function with the identities of
the two participants, Alice and Bob, the secret password, and the
counter:
base = H(max(Alice,Bob)  min(Alice,Bob)  password  counter)
The identities are passed to the max() and min() functions to provide
the necessary ordering of the inputs to H() while still allowing for
a peertopeer exchange where both Alice and Bob each view themselves
as the "initiator" of the exchange.
The base is then stretched using the technique from Section B.5.1 of
[FIPS1864]. The key derivation function, KDF, is used to produce a
bitstream whose length is equal to the length of the prime from the
group's domain parameter set plus the constant sixtyfour (64) to
derive a temporary value, and the temporary value is modularly
reduced to produce a seed:
n = len(p) + 64
temp = KDFn(base, "Dragonfly Hunting and Pecking")
seed = (temp mod (p  1)) + 1
The string bound to the derived temporary value is for illustrative
purposes only. Implementations of the Dragonfly key exchange SHOULD
use a usagespecific label with the KDF.
Note: The base is stretched to 64 more bits than are needed so that
the bias from the modular reduction is not so apparent.
The seed is then passed to the groupspecific huntingandpecking
technique.
If the protocol performing the Dragonfly exchange has the ability to
exchange random nonces, those SHOULD be added to the computation of
the base to ensure that each run of the protocol produces a different
PE.
3.2.1. Hunting and Pecking with ECC Groups
The ECCspecific huntingandpecking technique entails looping until
a valid point on the elliptic curve has been found. The seed is used
as an xcoordinate with the equation of the curve to check whether
x^3 + a*x + b is a quadratic residue modulo p. If it is not, then
the counter is incremented, a new base and new seed are generated,
and the hunting and pecking continues. If it is a quadratic residue
modulo p, then the xcoordinate is assigned the value of seed and the
current base is stored. When the huntingandpecking loop
terminates, the xcoordinate is used with the equation of the curve
to solve for a ycoordinate. An ambiguity exists since two values
for the ycoordinate would be valid, and the loworder bit of the
stored base is used to unambiguously determine the correct
ycoordinate. The resulting (x,y) pair becomes the Password Element,
PE.
Algorithmically, the process looks like this:
found = 0
counter = 1
n = len(p) + 64
do {
base = H(max(Alice,Bob)  min(Alice,Bob)  password  counter)
temp = KDFn(base, "Dragonfly Hunting And Pecking")
seed = (temp mod (p  1)) + 1
if ( (seed^3 + a*seed + b) is a quadratic residue mod p)
then
if ( found == 0 )
then
x = seed
save = base
found = 1
fi
fi
counter = counter + 1
} while ((found == 0)  (counter <= k))
y = sqrt(x^3 + ax + b)
if ( lsb(y) == lsb(save) )
then
PE = (x,y)
else
PE = (x,py)
fi
Figure 1: Fixing PE for ECC Groups
Checking whether a value is a quadratic residue modulo a prime can
leak information about that value in a sidechannel attack.
Therefore, it is RECOMMENDED that the technique used to determine if
the value is a quadratic residue modulo p blind the value with a
random number so that the blinded value can take on all numbers
between 1 and p1 with equal probability while not changing its
quadratic residuosity. Determining the quadratic residue in a
fashion that resists leakage of information is handled by flipping a
coin and multiplying the blinded value by either a random quadratic
residue or a random quadratic nonresidue and checking whether the
multiplied value is a quadratic residue (qr) or a quadratic
nonresidue (qnr) modulo p, respectively. The random residue and
nonresidue can be calculated prior to hunting and pecking by
calculating the Legendre symbol on random values until they are
found:
do {
qr = random() mod p
} while ( lgr(qr, p) != 1)
do {
qnr = random() mod p
} while ( lgr(qnr, p) != 1)
Algorithmically, the masking technique to find out whether or not a
value is a quadratic residue looks like this:
is_quadratic_residue (val, p) {
r = (random() mod (p  1)) + 1
num = (val * r * r) mod p
if ( lsb(r) == 1 )
num = (num * qr) mod p
if ( lgr(num, p) == 1)
then
return TRUE
fi
else
num = (num * qnr) mod p
if ( lgr(num, p) == 1)
then
return TRUE
fi
fi
return FALSE
}
3.2.2. Hunting and Pecking with MODP Groups
The MODPspecific huntingandpecking technique entails finding a
random element which, when used as a generator, will create a group
with the same order as the group created by the generator from the
domain parameter set. The secret generator is found by
exponentiating the seed to the value ((p1)/q), where p is the prime
and q is the order from the domain parameter set. If that value is
greater than one (1), it becomes the PE; otherwise, the counter is
incremented, a new base and seed are generated, and the hunting and
pecking continues.
Algorithmically, the process looks like this:
found = 0
counter = 1
n = len(p) + 64
do {
base = H(max(Alice,Bob)  min(Alice,Bob)  password  counter)
temp = KDFn(seed, "Dragonfly Hunting And Pecking")
seed = (temp mod (p  1)) + 1
temp = seed ^ ((p1)/q) mod p
if (temp > 1)
then
if (not found)
PE = temp
found = 1
fi
fi
counter = counter + 1
} while ((found == 0)  (counter <= k))
Figure 2: Fixing PE for MODP Groups
3.3. The Commit Exchange
In the Commit Exchange, both sides commit to a single guess of the
password. The peers generate a scalar and an element, exchange them
with each other, and process the other's scalar and element to
generate a common and shared secret.
First, each peer generates two random numbers, private and mask that
are each greater than one (1) and less than the order from the
selected domain parameter set:
1 < private < q
1 < mask < q
These two secrets and the Password Element are then used to construct
the scalar and element:
scalar = (private + mask) modulo q
Element = inverse(scalarop(mask, PE))
If the scalar is less than two (2), the private and mask MUST be
thrown away and new values generated. Once a valid scalar and
Element are generated, the mask is no longer needed and MUST be
irretrievably destroyed.
The peers exchange their scalar and Element and check the peer's
scalar and Element, deemed peerscalar and PeerElement. If the peer
has sent an identical scalar and Element  i.e., if scalar equals
peerscalar and Element equals PeerElement  it is sign of a
reflection attack, and the exchange MUST be aborted. If the values
differ, peerscalar and PeerElement must be validated. For the
peerscalar to be valid, it MUST be between 1 and q exclusive.
Validation of the PeerElement depends on the type of cryptosystem 
validation of an (x,y) pair as an ECC element is specified in
Section 2.1, and validation of a number as an FFC element is
specified in Section 2.2. If either the peerscalar or PeerElement
fail validation, then the exchange MUST be terminated and
authentication fails. If both the peerscalar and PeerElement are
valid, they are used with the Password Element to derive a shared
secret, ss:
ss = F(scalarop(private,
elementop(peerElement,
scalarop(peerscalar, PE))))
To enforce key separation and cryptographic hygiene, the shared
secret is stretched into two subkeys  a key confirmation key, kck,
and a master key, mk. Each of the subkeys SHOULD be at least the
length of the prime used in the selected group.
kck  mk = KDFn(ss, "Dragonfly Key Derivation")
where n = len(p)*2.
3.4. The Confirm Exchange
In the Confirm Exchange, both sides confirm that they derived the
same secret, and therefore, are in possession of the same password.
The Commit Exchange consists of an exchange of data that is the
output of the random function, H(), the key confirmation key, and the
two scalars and two elements exchanged in the Commit Exchange. The
order of the scalars and elements are: scalars before elements, and
sender's value before recipient's value. So from each peer's
perspective, it would generate:
confirm = H(kck  scalar  peerscalar 
Element  PeerElement  <senderid>)
Where <senderid> is the identity of the sender of the confirm
message. This identity SHALL be that contributed by the sender of
the confirm message in generation of the base in Section 3.2.
The two peers exchange these confirmations and verify the correctness
of the other peer's confirmation that they receive. If the other
peer's confirmation is valid, authentication succeeds; if the other
peer's confirmation is not valid, authentication fails.
If authentication fails, all ephemeral state created as part of the
particular run of the Dragonfly exchange MUST be irretrievably
destroyed. If authentication does not fail, mk can be exported as an
authenticated and secret key that can be used by another protocol,
for instance IPsec, to protect other data.
4. Security Considerations
The Dragonfly exchange requires both participants to have an
identical representation of the password. Salting of the password
merely generates a new credential  the salted password  that must
be identically represented on both sides. If an adversary is able to
gain access to the database of salted passwords, she would be able to
impersonate one side to the other, even if she was unable to
determine the underlying, unsalted password.
Resistance to dictionary attack means that an adversary must launch
an active attack to make a single guess at the password. If the size
of the dictionary from which the password was extracted was d, and
each password in the dictionary has an equal probability of being
chosen, then the probability of success after a single guess is 1/d.
After x guesses, and removal of failed guesses from the pool of
possible passwords, the probability becomes 1/(dx). As x grows, so
does the probability of success. Therefore, it is possible for an
adversary to determine the password through repeated bruteforce,
active, guessing attacks. Users of the Dragonfly key exchange SHOULD
ensure that the size of the pool from which the password was drawn,
d, is sufficiently large to make this attack preventable.
Implementations of Dragonfly SHOULD support countermeasures to deal
with this attack  for instance, by refusing authentication attempts
for a certain amount of time, after the number of failed
authentication attempts reaches a certain threshold. No such
threshold or amount of time is recommended in this memo.
Due to the problems with using groups that contain a small subgroup,
it is RECOMMENDED that implementations of Dragonfly not allow for the
specification of a group's complete domain parameter to be sent
inline, but instead use a common repository and pass an identifier
to a domain parameter set whose strength has been rigorously proven
and that does not have small subgroups. If a group's complete domain
parameter set is passed inline, it SHOULD NOT be used with Dragonfly
unless it directly matches a known good group.
It is RECOMMENDED that an implementation set the security parameter,
k, to a value of at least forty (40) which will put the probability
that more than forty iterations are needed in the order of one in one
trillion (1:1,000,000,000,000).
The technique used to obtain the Password Element in Section 3.2.1
addresses sidechannel attacks in a manner deemed controversial by
some reviewers in the CFRG. An alternate method, such as the one
defined in [hash2ec], can be used to alleviate concerns.
This key exchange protocol has received cryptanalysis in [clarkehao].
[lanskro] provides a security proof of Dragonfly in the random oracle
model when both identities are included in the data sent in the
Confirm Exchange (see Section 3.4).
5. References
5.1. Normative References
[RFC2119] Bradner, S., "Key words for use in RFCs to Indicate
Requirement Levels", BCP 14, RFC 2119,
DOI 10.17487/RFC2119, March 1997,
<http://www.rfceditor.org/info/rfc2119>.
5.2. Informative References
[clarkehao] Clarke, D. and F. Hao, "Cryptanalysis of the Dragonfly
Key Exchange Protocol", IET Information Security, Volume
8, Issue 6, DOI 10.1049/ietifs.2013.0081, November 2014.
[FIPS1864] NIST, "Digital Signature Standard (DSS)", Federal
Information Processing Standard (FIPS) 1864,
DOI 10.6028/NIST.FIPS.1864, July 2013.
[hash2ec] Brier, E., Coron, JS., Icart, T., Madore, D., Randriam,
H., and M. Tibouchi, "Efficient Indifferentiable Hashing
into Ordinary Elliptic Curves", Cryptology ePrint Archive
Report 2009/340, 2009.
[lanskro] Lancrenon, J. and M. Skrobot, "On the Provable Security
of the Dragonfly Protocol", Proceedings of 18th
International Information Security Conference (ISC
2015), pp 244261, DOI 10.1007/9783319233185_14,
September 2015.
[RANDOR] Bellare, M. and P. Rogaway, "Random Oracles are
Practical: A Paradigm for Designing Efficient Protocols",
Proceedings of the 1st ACM Conference on Computer and
Communication Security, ACM Press,
DOI 10.1145/168588.168596, 1993.
[RFC5433] Clancy, T. and H. Tschofenig, "Extensible Authentication
Protocol  Generalized PreShared Key (EAPGPSK) Method",
RFC 5433, DOI 10.17487/RFC5433, February 2009,
<http://www.rfceditor.org/info/rfc5433>.
[RFC6090] McGrew, D., Igoe, K., and M. Salter, "Fundamental
Elliptic Curve Cryptography Algorithms", RFC 6090,
DOI 10.17487/RFC6090, February 2011,
<http://www.rfceditor.org/info/rfc6090>.
[RFC7296] Kaufman, C., Hoffman, P., Nir, Y., Eronen, P., and T.
Kivinen, "Internet Key Exchange Protocol Version 2
(IKEv2)", STD 79, RFC 7296, DOI 10.17487/RFC7296, October
2014, <http://www.rfceditor.org/info/rfc7296>.
[SP800108] Chen, L., "Recommendation for Key Derivation Using
Pseudorandom Functions", NIST Special
Publication 800108, October 2009.
[SP80056A] Barker, E., Johnson, D., and M. Smid, "Recommendation for
PairWise Key Establishment Schemes Using Discrete
Logarithm Cryptography (Revised)", NIST Special
Publication 80056A, March 2007.
Acknowledgements
The author would like to thank Kevin Igoe and David McGrew, chairmen
of the Crypto Forum Research Group (CFRG) for agreeing to accept this
memo as a CFRG work item. Additional thanks go to Scott Fluhrer and
Hideyuki Suzuki for discovering attacks against earlier versions of
this key exchange and suggesting fixes to address them. Lily Chen
provided helpful discussions on hashing into an elliptic curve. Rich
Davis suggested the validation steps used on received elements to
prevent a small subgroup attack. Dylan Clarke and Feng Hao
discovered a dictionary attack against Dragonfly if those checks are
not made and a group with a small subgroup is used. And finally, a
very heartfelt thanks to Jean Lancrenon and Marjan Skrobot for
developing a proof of the security of Dragonfly.
The blinding scheme to prevent sidechannel attacks when determining
whether a value is a quadratic residue modulo a prime was suggested
by Scott Fluhrer. Kevin Igoe suggested addition of the security
parameter k to hide the amount of time taken hunting and pecking for
the password element.
Author's Address
Dan Harkins (editor)
Aruba Networks
1322 Crossman Avenue
Sunnyvale, CA 940891113
United States
Email: dharkins@arubanetworks.com
