The notion of P-complete decision problems is useful in the analysis of:
specifically when stronger notions of reducibility than polytime-reducibility are considered.
The specific type of reduction used varies and may affect the exact set of problems. Generically, reductions stronger than polynomial-time reductions are used, since all languages in P (except the empty language and the language of all strings) are P-complete under polynomial-time reductions. If we use NC reductions, that is, reductions which can operate in polylogarithmic time on a parallel computer with a polynomial number of processors, then all P-complete problems lie outside NC and so cannot be effectively parallelized, under the unproven assumption that NC ≠ P. If we use the stronger log-space reduction, this remains true, but additionally we learn that all P-complete problems lie outside L under the weaker unproven assumption that L ≠ P. In this latter case the set P-complete may be smaller.
The class P, typically taken to consist of all the "tractable" problems for a sequential computer, contains the class NC, which consists of those problems which can be efficiently solved on a parallel computer. This is because parallel computers can be simulated on a sequential machine. It is not known whether NC = P. In other words, it is not known whether there are any tractable problems that are inherently sequential. Just as it is widely suspected that P does not equal NP, so it is widely suspected that NC does not equal P.
Similarly, the class L contains all problems that can be solved by a sequential computer in logarithmic space. Such machines run in polynomial time because they can have a polynomial number of configurations. It is suspected that L ≠ P; that is, that some problems that can be solved in polynomial time also require more than logarithmic space.
Similarly to the use of NP-complete problems to analyze the P = NP question, the P-complete problems, viewed as the "probably not parallelizable" or "probably inherently sequential" problems, serves in a similar manner to study the NC = P question. Finding an efficient way to parallelize the solution to some P-complete problem would show that NC = P. It can also be thought of as the "problems requiring superlogarithmic space"; a log-space solution to a P-complete problem (using the definition based on log-space reductions) would imply L = P.
The logic behind this is analogous to the logic that a polynomial-time solution to an NP-complete problem would prove P = NP: if we have a NC reduction from any problem in P to a problem A, and an NC solution for A, then NC = P. Similarly, if we have a log-space reduction from any problem in P to a problem A, and a log-space solution for A, then L = P.
The most basic P-complete problem under logspace many-one reductions is following: given a Turing machine , an input for that machine x, and a number T (written in unary), does that machine halt on that input within the first T steps? For any x in in P, output the encoding of the Turing machine which accepts it in polynomial-time, the encoding of x itself, and a number of steps corresponding to the p which is there polynomial-time bound on the operation of the Turing Machine deciding , . The machine M halts on x within steps if and only if x is in L. Clearly, if we can parallelize a general simulation of a sequential computer (ie. The Turing machine simulation of a Turing machine), then we will be able to parallelize any program that runs on that computer. If this problem is in NC, then so is every other problem in P. If the number of steps is written in binary, the problem is EXPTIME-complete. This problem illustrates a common trick in the theory of P-completeness. We aren't really interested in whether a problem can be solved quickly on a parallel machine. We're just interested in whether a parallel machine solves it much more quickly than a sequential machine. Therefore, we have to reword the problem so that the sequential version is in P. That is why this problem required T to be written in unary. If a number T is written as a binary number (a string of n ones and zeros, where n = log T), then the obvious sequential algorithm can take time 2n. On the other hand, if T is written as a unary number (a string of n ones, where n = T), then it only takes time n. By writing T in unary rather than binary, we have reduced the obvious sequential algorithm from exponential time to linear time. That puts the sequential problem in P. Then, it will be in NC if and only if it is parallelizable.
Many other problems have been proved to be P-complete, and therefore are widely believed to be inherently sequential. These include the following problems which are P-complete under at least logspace reductions, either as given, or in a decision-problem form:
Most of the languages above are P-complete under even stronger notions of reduction, such as uniform many-one reductions, DLOGTIME reductions, or polylogarithmic projections.
In order to prove that a given problem in P is P-complete, one typically tries to reduce a known P-complete problem to the given one.
P-complete problems may be solvable with different time complexities. For instance, the Circuit Value Problem can be solved in linear time by a topological sort. Of course, because the reductions to a P-complete problem may have different time complexities, this fact does not imply that all the problems in P can also be solved in linear time.
Some NP-problems are not known to be either NP-complete or in P. These problems (e.g. factoring, graph isomorphism, parity games) are suspected to be difficult. Similarly there are problems in P that are not known to be either P-complete or NC, but are thought to be difficult to parallelize. Examples include the decision problem forms of finding the greatest common divisor of two numbers, determining what answer the extended Euclidean algorithm would return when given two numbers, and computing the Maximum weight matching of a graph with large integer weights.