Nondeterministic finite automaton
In automata theory, a finitestate machine is called a deterministic finite automaton (DFA), if
 each of its transitions is uniquely determined by its source state and input symbol, and
 reading an input symbol is required for each state transition.
A nondeterministic finite automaton (NFA), or nondeterministic finitestate machine, does not need to obey these restrictions. In particular, every DFA is also an NFA. Sometimes the term NFA is used in a narrower sense, referring to an NFA that is not a DFA, but not in this article.
Using the subset construction algorithm, each NFA can be translated to an equivalent DFA; i.e., a DFA recognizing the same formal language.^{[1]} Like DFAs, NFAs only recognize regular languages.
NFAs were introduced in 1959 by Michael O. Rabin and Dana Scott,^{[2]} who also showed their equivalence to DFAs. NFAs are used in the implementation of regular expressions: Thompson's construction is an algorithm for compiling a regular expression to an NFA that can efficiently perform pattern matching on strings. Conversely, Kleene's algorithm can be used to convert an NFA into a regular expression (whose size is generally exponential in the input automaton).
NFAs have been generalized in multiple ways, e.g., nondeterministic finite automata with εmoves, finitestate transducers, pushdown automata, alternating automata, ωautomata, and probabilistic automata. Besides the DFAs, other known special cases of NFAs are unambiguous finite automata (UFA) and selfverifying finite automata (SVFA).
Informal introduction[edit]
There are two ways to describe the behavior of an NFA, and both of them are equivalent. The first way makes use of the nondeterminism in the name of an NFA. For each input symbol, the NFA transitions to a new state until all input symbols have been consumed. In each step, the automaton nondeterministically "chooses" one of the applicable transitions. If there exists at least one "lucky run", i.e. some sequence of choices leading to an accepting state after completely consuming the input, it is accepted. Otherwise, i.e. if no choice sequence at all can consume all the input^{[3]} and lead to an accepting state, the input is rejected.^{[4]}^{: 19 }^{[5]}^{: 319 }
In the second way, the NFA consumes a string of input symbols, one by one. In each step, whenever two or more transitions are applicable, it "clones" itself into appropriately many copies, each one following a different transition. If no transition is applicable, the current copy is in a dead end, and it "dies". If, after consuming the complete input, any of the copies is in an accept state, the input is accepted, else, it is rejected.^{[4]}^{: 19–20 }^{[6]}^{: 48 }^{[7]}^{: 56 }
Formal definition[edit]
For a more elementary introduction of the formal definition, see automata theory.
Automaton[edit]
An NFA is represented formally by a 5tuple, , consisting of
 a finite set of states .
 a finite set of input symbols .
 a transition function : .
 an initial (or start) state .
 a set of states distinguished as accepting (or final) states .
Here, denotes the power set of .
Recognized language[edit]
Given an NFA , its recognized language is denoted by , and is defined as the set of all strings over the alphabet that are accepted by .
Loosely corresponding to the above informal explanations, there are several equivalent formal definitions of a string being accepted by :
 is accepted if a sequence of states, , exists in such that:
 , for
 .
 In words, the first condition says that the machine starts in the start state . The second condition says that given each character of string , the machine will transition from state to state according to the transition function . The last condition says that the machine accepts if the last input of causes the machine to halt in one of the accepting states. In order for to be accepted by , it is not required that every state sequence ends in an accepting state, it is sufficient if one does. Otherwise, i.e. if it is impossible at all to get from to a state from by following , it is said that the automaton rejects the string. The set of strings accepts is the language recognized by and this language is denoted by .^{[5]}^{: 320 }^{[6]}^{: 54 }
 Alternatively, is accepted if , where is defined recursively by:
 where is the empty string, and
 for all .
 In words, is the set of all states reachable from state by consuming the string . The string is accepted if some accepting state in can be reached from the start state by consuming .^{[4]}^{: 21 }^{[7]}^{: 59 }
Initial state[edit]
The above automaton definition uses a single initial state, which is not necessary. Sometimes, NFAs are defined with a set of initial states. There is an easy construction that translates an NFA with multiple initial states to an NFA with a single initial state, which provides a convenient notation.
Example[edit]
The following automaton , with a binary alphabet, determines if the input ends with a 1. Let where the transition function can be defined by this state transition table (cf. upper left picture):
 InputState
0 1
Since the set contains more than one state, is nondeterministic.
The language of can be described by the regular language given by the regular expression (01)*1
.
All possible state sequences for the input string "1011" are shown in the lower picture. The string is accepted by since one state sequence satisfies the above definition; it doesn't matter that other sequences fail to do so. The picture can be interpreted in a couple of ways:
 In terms of the above "luckyrun" explanation, each path in the picture denotes a sequence of choices of .
 In terms of the "cloning" explanation, each vertical column shows all clones of at a given point in time, multiple arrows emanating from a node indicate cloning, a node without emanating arrows indicating the "death" of a clone.
The feasibility to read the same picture in two ways also indicates the equivalence of both above explanations.
 Considering the first of the above formal definitions, "1011" is accepted since when reading it may traverse the state sequence , which satisfies conditions 1 to 3.
 Concerning the second formal definition, bottomup computation shows that , hence , hence , hence , and hence ; since that set is not disjoint from , the string "1011" is accepted.
In contrast, the string "10" is rejected by (all possible state sequences for that input are shown in the upper right picture), since there is no way to reach the only accepting state, , by reading the final 0 symbol. While can be reached after consuming the initial "1", this does not mean that the input "10" is accepted; rather, it means that an input string "1" would be accepted.
Equivalence to DFA[edit]
A deterministic finite automaton (DFA) can be seen as a special kind of NFA, in which for each state and symbol, the transition function has exactly one state. Thus, it is clear that every formal language that can be recognized by a DFA can be recognized by an NFA.
Conversely, for each NFA, there is a DFA such that it recognizes the same formal language. The DFA can be constructed using the powerset construction.
This result shows that NFAs, despite their additional flexibility, are unable to recognize languages that cannot be recognized by some DFA. It is also important in practice for converting easiertoconstruct NFAs into more efficiently executable DFAs. However, if the NFA has n states, the resulting DFA may have up to 2^{n} states, which sometimes makes the construction impractical for large NFAs.
NFA with εmoves[edit]
Nondeterministic finite automaton with εmoves (NFAε) is a further generalization to NFA. In this kind of automaton, the transition function is additionally defined on the empty string ε. A transition without consuming an input symbol is called an εtransition and is represented in state diagrams by an arrow labeled "ε". εtransitions provide a convenient way of modeling systems whose current states are not precisely known: i.e., if we are modeling a system and it is not clear whether the current state (after processing some input string) should be q or q', then we can add an εtransition between these two states, thus putting the automaton in both states simultaneously.
Formal definition[edit]
An NFAε is represented formally by a 5tuple, , consisting of
 a finite set of states
 a finite set of input symbols called the alphabet
 a transition function
 an initial (or start) state
 a set of states distinguished as accepting (or final) states .
Here, denotes the power set of and denotes empty string.
εclosure of a state or set of states[edit]
For a state , let denote the set of states that are reachable from by following εtransitions in the transition function , i.e., if there is a sequence of states such that
 ,
 for each , and
 .
is known as the epsilon closure, (also εclosure) of .
The εclosure of a set of states of an NFA is defined as the set of states reachable from any state in following εtransitions. Formally, for , define .
Extended transition function[edit]
Similar to NFA without εmoves, the transition function of an NFAε can be extended to strings. Informally, denotes the set of all states the automaton may have reached when starting in state and reading the string The function can be defined recursively as follows.
 , for each state and where denotes the epsilon closure;
 Informally: Reading the empty string may drive the automaton from state to any state of the epsilon closure of
 for each state each string and each symbol
 Informally: Reading the string may drive the automaton from state to any state in the recursively computed set ; after that, reading the symbol may drive it from to any state in the epsilon closure of
The automaton is said to accept a string if
that is, if reading may drive the automaton from its start state to some accepting state in ^{[4]}^{: 25 }
Example[edit]
Let be a NFAε, with a binary alphabet, that determines if the input contains an even number of 0s or an even number of 1s. Note that 0 occurrences is an even number of occurrences as well.
In formal notation, let
Input State

0  1  ε 

S_{0}  {}  {}  {S_{1}, S_{3}} 
S_{1}  {S_{2}}  {S_{1}}  {} 
S_{2}  {S_{1}}  {S_{2}}  {} 
S_{3}  {S_{3}}  {S_{4}}  {} 
S_{4}  {S_{4}}  {S_{3}}  {} 
can be viewed as the union of two DFAs: one with states and the other with states . The language of can be described by the regular language given by this regular expression . We define using εmoves but can be defined without using εmoves.
Equivalence to NFA[edit]
To show NFAε is equivalent to NFA, first note that NFA is a special case of NFAε, so it remains to show for every NFAε, there exists an equivalent NFA.
Given an NFA with epsilon moves define an NFA where
and
 for each state and each symbol using the extended transition function defined above.
One has to distinguish the transition functions of and viz. and and their extensions to strings, and respectively. By construction, has no εtransitions.
One can prove that for each string , by induction on the length of
Based on this, one can show that if, and only if, for each string
 If this follows from the definition of
 Otherwise, let with and
 From and we have we still have to show the "" direction.
 If contains a state in then contains the same state, which lies in .
 If contains and then also contains a state in viz.
 If contains and then the state in ^{[clarify]} must be in ^{[4]}^{: 26–27 }
Since NFA is equivalent to DFA, NFAε is also equivalent to DFA.
Closure properties[edit]
The set of languages recognized by NFAs is closed under the following operations. These closure operations are used in Thompson's construction algorithm, which constructs an NFA from any regular expression. They can also be used to prove that NFAs recognize exactly the regular languages.
 Union (cf. picture); that is, if the language L_{1} is accepted by some NFA A_{1} and L_{2} by some A_{2}, then an NFA A_{u} can be constructed that accepts the language L_{1}∪L_{2}.
 Intersection; similarly, from A_{1} and A_{2} an NFA A_{i} can be constructed that accepts L_{1}∩L_{2}.
 Concatenation
 Negation; similarly, from A_{1} an NFA A_{n} can be constructed that accepts Σ^{*}\L_{1}.
 Kleene closure
Since NFAs are equivalent to nondeterministic finite automaton with εmoves (NFAε), the above closures are proved using closure properties of NFAε.
Properties[edit]
The machine starts in the specified initial state and reads in a string of symbols from its alphabet. The automaton uses the state transition function Δ to determine the next state using the current state, and the symbol just read or the empty string. However, "the next state of an NFA depends not only on the current input event, but also on an arbitrary number of subsequent input events. Until these subsequent events occur it is not possible to determine which state the machine is in".^{[8]} If, when the automaton has finished reading, it is in an accepting state, the NFA is said to accept the string, otherwise it is said to reject the string.
The set of all strings accepted by an NFA is the language the NFA accepts. This language is a regular language.
For every NFA a deterministic finite automaton (DFA) can be found that accepts the same language. Therefore, it is possible to convert an existing NFA into a DFA for the purpose of implementing a (perhaps) simpler machine. This can be performed using the powerset construction, which may lead to an exponential rise in the number of necessary states. For a formal proof of the powerset construction, please see the Powerset construction article.
Implementation[edit]
There are many ways to implement a NFA:
 Convert to the equivalent DFA. In some cases this may cause exponential blowup in the number of states.^{[9]}
 Keep a set data structure of all states which the NFA might currently be in. On the consumption of an input symbol, unite the results of the transition function applied to all current states to get the set of next states; if εmoves are allowed, include all states reachable by such a move (εclosure). Each step requires at most s^{2} computations, where s is the number of states of the NFA. On the consumption of the last input symbol, if one of the current states is a final state, the machine accepts the string. A string of length n can be processed in time O(ns^{2}),^{[7]}^{: 153 } and space O(s).
 Create multiple copies. For each n way decision, the NFA creates up to n−1 copies of the machine. Each will enter a separate state. If, upon consuming the last input symbol, at least one copy of the NFA is in the accepting state, the NFA will accept. (This, too, requires linear storage with respect to the number of NFA states, as there can be one machine for every NFA state.)
 Explicitly propagate tokens through the transition structure of the NFA and match whenever a token reaches the final state. This is sometimes useful when the NFA should encode additional context about the events that triggered the transition. (For an implementation that uses this technique to keep track of object references have a look at Tracematches.)^{[10]}
 It is PSPACEcomplete to test, given an NFA, whether it is universal, i.e., if there is a string that it does not accept.^{[11]} The same is true of the inclusion problem, i.e., given two NFAs, is the language of one a subset of the language of the other.
Application of NFA[edit]
NFAs and DFAs are equivalent in that if a language is recognized by an NFA, it is also recognized by a DFA and vice versa. The establishment of such equivalence is important and useful. It is useful because constructing an NFA to recognize a given language is sometimes much easier than constructing a DFA for that language. It is important because NFAs can be used to reduce the complexity of the mathematical work required to establish many important properties in the theory of computation. For example, it is much easier to prove closure properties of regular languages using NFAs than DFAs.
See also[edit]
 Deterministic finite automaton
 Twoway nondeterministic finite automaton
 Pushdown automaton
 Nondeterministic Turing machine
Notes[edit]
 ^ Martin, John (2010). Introduction to Languages and the Theory of Computation. McGraw Hill. p. 108. ISBN 9780071289429.
 ^ Rabin, M. O.; Scott, D. (April 1959). "Finite Automata and Their Decision Problems". IBM Journal of Research and Development. 3 (2): 114–125. doi:10.1147/rd.32.0114.
 ^ A choice sequence may lead into a "dead end" where no transition is applicable for the current input symbol; in this case it is considered unsuccessful.
 ^ ^{a} ^{b} ^{c} ^{d} ^{e} John E. Hopcroft and Jeffrey D. Ullman (1979). Introduction to Automata Theory, Languages, and Computation. Reading/MA: AddisonWesley. ISBN 020102988X.
 ^ ^{a} ^{b} Alfred V. Aho and John E. Hopcroft and Jeffrey D. Ullman (1974). The Design and Analysis of Computer Algorithms. Reading/MA: AddisonWesley. ISBN 0201000296.
 ^ ^{a} ^{b} Michael Sipser (1997). Introduction to the Theory of Computation. Boston/MA: PWS Publishing Co. ISBN 053494728X.
 ^ ^{a} ^{b} ^{c} John E. Hopcroft and Rajeev Motwani and Jeffrey D. Ullman (2003). Introduction to Automata Theory, Languages, and Computation (PDF). Upper Saddle River/NJ: Addison Wesley. ISBN 0201441241.
 ^ FOLDOC Free Online Dictionary of Computing, FiniteState Machine
 ^ Chris Calabro (February 27, 2005). "NFA to DFA blowup" (PDF). cseweb.ucsd.edu. Retrieved 6 March 2023.
 ^ Allan, C., Avgustinov, P., Christensen, A. S., Hendren, L., Kuzins, S., Lhoták, O., de Moor, O., Sereni, D., Sittampalam, G., and Tibble, J. 2005. Adding trace matching with free variables to AspectJ Archived 20090918 at the Wayback Machine. In Proceedings of the 20th Annual ACM SIGPLAN Conference on Object Oriented Programming, Systems, Languages, and Applications (San Diego, CA, USA, October 16–20, 2005). OOPSLA '05. ACM, New York, NY, 345364.
 ^ Historically shown in: Meyer, A. R.; Stockmeyer, L. J. (19721025). "The equivalence problem for regular expressions with squaring requires exponential space". Proceedings of the 13th Annual Symposium on Switching and Automata Theory (SWAT). USA: IEEE Computer Society: 125–129. doi:10.1109/SWAT.1972.29. For a modern presentation, see [1]
References[edit]
 M. O. Rabin and D. Scott, "Finite Automata and their Decision Problems", IBM Journal of Research and Development, 3:2 (1959) pp. 115–125.
 Michael Sipser, Introduction to the Theory of Computation. PWS, Boston. 1997. ISBN 053494728X. (see section 1.2: Nondeterminism, pp. 47–63.)
 John E. Hopcroft and Jeffrey D. Ullman, Introduction to Automata Theory, Languages, and Computation, AddisonWesley Publishing, Reading Massachusetts, 1979. ISBN 020102988X. (See chapter 2.)