Discrete logarithm

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In mathematics, a discrete logarithm is an integer k solving the equation bk = g, where b and g are elements of a finite group. Discrete logarithms are thus the finite-group-theoretic analogue of ordinary logarithms, which solve the same equation for real numbers b and g, where b is the base of the logarithm and g is the value whose logarithm is being taken.

No efficient general method for computing discrete logarithms on conventional computers is known. Several important algorithms in public-key cryptography base their security on the assumption that the discrete logarithm problem over carefully chosen groups has no efficient solution.


Discrete logarithms are perhaps simplest to understand in the group (Zp)×. This is the group of multiplication modulo the prime p. Its elements are congruence classes modulo p, and the group product of two elements may be obtained by ordinary integer multiplication of the elements followed by reduction modulo p.

The kth power of one of the numbers in this group may be computed by finding its kth power as an integer and then finding the remainder after division by p. When the numbers involved are large, it is more efficient to reduce modulo p multiple times during the computation. Regardless of the specific algorithm used, this operation is called modular exponentiation. For example, consider (Z17)×. To compute 34 in this group, compute 34 = 81, and then divide 81 by 17, obtaining a remainder of 13. Thus 34 = 13 in the group (Z17)×.

The discrete logarithm is just the inverse operation. For example, consider the equation 3k ≡ 13 (mod 17) for k. From the example above, one solution is k = 4, but it is not the only solution. Since 316 ≡ 1 (mod 17)—as follows from Fermat's little theorem—it also follows that if n is an integer then 34+16n ≡ 34 × (316)n ≡ 13 × 1n ≡ 13 (mod 17). Hence the equation has infinitely many solutions of the form 4 + 16n. Moreover, since 16 is the smallest positive integer m satisfying 3m ≡ 1 (mod 17), i.e. 16 is the order of 3 in (Z17)×, these are the only solutions. Equivalently, the set of all possible solutions can be expressed by the constraint that k ≡ 4 (mod 16).


In general, let G be any group, with its group operation denoted by multiplication. Let b and g be any elements of G. Then any integer k that solves bk = g is termed a discrete logarithm (or simply logarithm, in this context) of g to the base b. We write k = logb g. Depending on b and g, it is possible that no discrete logarithm exists, or that more than one discrete logarithm exists. Let H be the subgroup of G generated by b. Then H is a cyclic group, and integral logb g exists for all g in H. If H is infinite, then logb g is also unique, and the discrete logarithm amounts to a group isomorphism

\log_b \colon H \rightarrow \mathbf{Z}.

On the other hand, if H is finite of size n, then logb g is unique only up to congruence modulo n, and the discrete logarithm amounts to a group isomorphism

\log_b\colon H \rightarrow \mathbf{Z}_n,

where Zn denotes the ring of integers modulo n. The familiar base change formula for ordinary logarithms remains valid: If c is another generator of H, then

\log_c (g) = \log_c (b) \cdot \log_b (g).


Question dropshade.png Unsolved problem in computer science:
Can the discrete logarithm be computed in polynomial time on a classical computer?
(more unsolved problems in computer science)

The discrete logarithm problem is considered to be computationally intractable. That is, no efficient classical algorithm is known for computing discrete logarithms in general.

Efficient algorithms exist in certain special cases. For example, let G = Zp be the integers modulo p under addition. The abstract equation bk = g then amounts to

b k \equiv g \pmod p

in ordinary arithmetic notation. The extended Euclidean algorithm finds k quickly.

A general algorithm for computing logb g is to raise b to higher and higher powers k until the desired g is found. This algorithm is sometimes called trial multiplication. It requires running time linear in the size of the group G and thus exponential in the number of digits in the size of the group. Therefore it is an exponential-time algorithm, practical only for small groups G.

More sophisticated algorithms exist, usually inspired by similar algorithms for integer factorization. These algorithms run faster than the naive algorithm, some of them linear in the square root of the size of the group, and thus exponential in half the number of digits in the size of the group. However none of them run in polynomial time (in the number of digits in the size of the group).

There is an efficient quantum algorithm due to Peter Shor.[1]

Comparison with integer factorization[edit]

While computing discrete logarithms and factoring integers are distinct problems, they share some properties:

  • both problems are difficult (no efficient algorithms are known for non-quantum computers),
  • for both problems efficient algorithms on quantum computers are known,
  • algorithms from one problem are often adapted to the other, and
  • the difficulty of both problems has been used to construct various cryptographic systems.


There exist groups for which computing discrete logarithms is apparently difficult. In some cases (e.g. large prime order subgroups of groups (Zp)×) there is not only no efficient algorithm known for the worst case, but the average-case complexity can be shown to be about as hard as the worst case using random self-reducibility.

At the same time, the inverse problem of discrete exponentiation is not difficult (it can be computed efficiently using exponentiation by squaring, for example). This asymmetry is analogous to the one between integer factorization and integer multiplication. Both asymmetries have been exploited in the construction of cryptographic systems.

Popular choices for the group G in discrete logarithm cryptography are the cyclic groups (Zp)× (e.g. ElGamal encryption, Diffie–Hellman key exchange, and the Digital Signature Algorithm) and cyclic subgroups of elliptic curves over finite fields (see elliptic curve cryptography).

While there is no publicly known algorithm for solving the discrete logarithm problem in general, the first three steps of the number field sieve algorithm only depend on the group G, not on the specific elements of G whose finite log is desired. By precomputing these three steps for a specific group, one need only carry out the last step, which is much less computationally expensive than the first three, to obtain a specific logarithm in that group.[2]

It turns out that much Internet traffic uses one of a handful of groups that are of order 1024-bits or less, e.g. cyclic groups with order of the Oakley primes specified in RFC 2409. The Logjam attack used this vulnerability to compromise a variety of Internet services that allowed the use of groups whose order was a 512-bit prime number, so called export grade.[2]

The authors of the Logjam attack estimate that the much more difficult precomputation needed to solve the discrete log problem for a 1024-bit prime would be within the budget of large national intelligence agency such as the U.S. National Security Agency (NSA). The Logjam authors speculate that precomputation against widely reused 1024 DH primes is behind claims in leaked NSA documents that NSA is able break much of current crypto.[2]


  1. ^ Shor, Peter (1997). "Polynomial-Time Algorithms for Prime Factorization and Discrete Logarithms on a Quantum Computer". SIAM Journal on Computing 26 (5): 1484–1509. arXiv:quant-ph/9508027. doi:10.1137/s0097539795293172. MR 1471990. 
  2. ^ a b c Adrian, David; Bhargavan, Karthikeyan; Durumeric, Zakir; Gaudry, Pierrick; Green, Matthew; Halderman, J. Alex; Heninger, Nadia; Springall, Drew; Thomé, Emmanuel; Valenta, Luke; VanderSloot, Benjamin; Wustrow, Eric; Zanella-Béguelin, Santiago; Zimmermann, Paul (October 2015). "Imperfect Forward Secrecy: How Diffie-Hellman Fails in Practice" (PDF).