CS 154. Finite Automata vs Regular Expressions, Non-Regular Languages
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1 CS 154 Finite Automata vs Regular Expressions, Non-Regular Languages
2 Deterministic Finite Automata Computation with finite memory
3 Non-Deterministic Finite Automata Computation with finite memory and guessing
4 Regular Languages are closed under all of the following operations: Union: A B = { w w A or w B } Intersection: A B = { w w A and w B } Complement: A = { w Σ* w A } Reverse: A R = { w 1 w k w k w 1 A } Concatenation: A B = { vw v A and w B } Star: A* = { w 1 w k k 0 and each w i A }
5 Regular Expressions Computation as simple, logical description A totally different way of thinking about computation: What is the complexity of describing the strings in the language?
6 Inductive Definition of Regexp Let Σ be an alphabet. We define the regular expressions over Σ inductively: For all σ Σ, σ is a regexp is a regexp is a regexp If R 1 and R 2 are both regexps, then (R 1 R 2 ), (R 1 + R 2 ), and (R 1 )* are regexps
7 Precedence Order: * then then + ( R 1 * R 2 Example: R 1 *R 2 + R 3 = ( ) ) + R 3
8 Definition: Regexps Represent Languages The regexp σ Σ represents the language {σ} The regexp represents {} The regexp represents If R 1 and R 2 are regular expressions representing L 1 and L 2 then: (R 1 R 2 ) represents L 1 L 2 (R 1 + R 2 ) represents L 1 L 2 (R 1 )* represents L 1 * Example: (10 + 0*1) represents {0 k 1 k 0} {10}
9 Regexps Represent Languages For every regexp R, define L(R) to be the language that R represents A string w Σ* is acceptedby R (or, w matches R) if w L(R) Example: matches the regexp (01)*0
10 Assume Σ = {0,1} { w w has exactly a single 1 } 0*10* { w w contains 001 } (0+1)*001(0+1)*
11 Assume Σ = {0,1} What language does the regexp * represent? {}
12 Assume Σ = {0,1} { w w has length 3 and its 3rd symbol is 0 } (0+1)(0+1)0(0+1)*
13 Assume Σ = {0,1} { w every odd position in w is a 1 } (1(0 + 1))*(1 + )
14 DFAs NFAs Regular Expressions! L can be represented by some regexp L is regular
15 L can be represented by some regexp L is regular
16 Given any regexp R, we will construct an NFA N s.t. N accepts exactly the strings accepted by R Proof by induction on the length of the regexp R: Base Cases (R has length 1): R = σ σ R = R =
17 Induction Step: Suppose every regexp of length < k represents some regular language. Consider a regexp R of length k > 1 Three possibilities for R: R = R 1 + R 2 R = R 1 R 2 R = (R 1 )*
18 Induction Step: Suppose every regexp of length < k represents some regular language. Consider a regexp R of length k > 1 Three possibilities for R: R = R 1 + R 2 R = R 1 R 2 R = (R 1 )* By induction, R 1 and R 2 represent some regular languages, L 1 and L 2 But L(R) = L(R 1 + R 2 ) = L 1 L 2 so L(R) is regular, by the union theorem!
19 Induction Step: Suppose every regexp of length < k represents some regular language. Consider a regexp R of length k > 1 Three possibilities for R: R = R 1 + R 2 R = R 1 R 2 R = (R 1 )* By induction, R 1 and R 2 represent some regular languages, L 1 and L 2 But L(R) = L(R 1 R 2 ) = L 1 L 2 so L(R) is regular by the concatenation theorem
20 Induction Step: Suppose every regexp of length < k represents some regular language. Consider a regexp R of length k > 1 Three possibilities for R: R = R 1 + R 2 R = R 1 R 2 R = (R 1 )* By induction, R 1 and R 2 represent some regular languages, L 1 and L 2 But L(R) = L(R 1 *) = L 1 * so L(R) is regular, by the star theorem
21 Induction Step: Suppose every regexp of length < k represents some regular language. Consider a regexp R of length k > 1 Three possibilities for R: R = R 1 + R 2 R = R 1 R 2 R = (R 1 )* By induction, R 1 and R 2 represent some regular languages, L 1 and L 2 But L(R) = L(R 1 *) = L 1 * so L(R) is regular, by the star theorem Therefore: If L is represented by a regexp, then L is regular
22 Give an NFA that accepts the language represented by (1(0 + 1))* 1 1,0 Regular expression: ( 1(0+1) )*
23 Generalized NFAs (GNFA) L can be represented by a regexp L is a regular language Idea: Transform an NFA for L into a regular expression by removing states and re-labeling the arcs with regular expressions Rather than reading in just 0 or 1 letters from the string on a step, we can read in entire substrings
24 A GNFA is a 5-tuple G = (Q, Σ, R, q start, q accept ) Q, Σ are states and alphabet R : (Q-{q accept }) (Q-{q start }) R is the transition function q start Q is the start state q accept Q is the (unique) accept state R = set of all regular expressions over Σ
25 A GNFA is a 5-tuple G = (Q, Σ, R, q start, q accept ) Let w Σ* and let Gbe a GNFA. G accepts w if w can be written as w = w 1 L w k where w i Σ* and there is a sequence r 0, r 1,..., r k Qsuch that r 0 = q start w i matches R(r i-1, r i ) for all i= 1,..., k, and r k = q accept L(G) = set of all strings that G accepts = the language recognized by G
26 Generalized NFA (GNFA) cb a*b a q 0 q 1 q 2 This GNFA recognizes L(a*b(cb)*a) Is aaabcbcba accepted or rejected? Is bba accepted or rejected? Is bcba accepted or rejected?
27 NFA Add unique start and accept states
28 NFA While the machine has more than 2 states: Pick an internal state, rip it out and re-label the arrows with regexps, to account for paths through the missing state 0 0 1
29 NFA While the machine has more than 2 states: Pick an internal state, rip it out and re-label the arrows with regexps, to account for paths through the missing state 01*0
30 GNFA While the machine has more than 2 states: In general: R(q 1,q 3 ) R(q 1,q 2 ) R(q 2,q 3 ) q 1 q 2 q 3 R(q 2,q 2 )
31 GNFA While the machine has more than 2 states: In general: R(q 1,q 2 )R(q 2,q 2 )*R(q 2,q 3 ) + R(q 1,q 3 ) q 1 q 3
32 a a,b b q 0 q 1 q 2 q 3 R(q 0,q 3 ) = (a*b)(a+b)* represents L(N)
33 a,b a*b q 0 q 2 q 3 R(q 0,q 3 ) = (a*b)(a+b)* represents L(N)
34 (a*b)(a+b)* q 0 q 3 R(q 0,q 3 ) = (a*b)(a+b)* represents L(N)
35 Formally: Given a DFA, add q start and q acc to create G For all q,q, define R(q,q ) to be σ if δ(q,σ) = q, else CONVERT(G): (Takes a GNFA, outputs a regexp) If #states = 2 return R(q start, q acc ) If #states > 2 select q rip Q different from q start and q acc define Q = Q {q rip } define R on Q -{q acc } x Q -{q start } as: defines a new GNFA G R (q i,q j ) = R(q i,q rip )R(q rip,q rip )*R(q rip,q j ) + R(q i,q j ) return CONVERT(G ) Claim: L(G ) = L(G)
36 Theorem: Let R = CONVERT(G). Then L(R) = L(G). Proof by induction on k, the number of states in G Base Case: k = 2 CONVERToutputs R(q start, q acc ) Inductive Step: Assume theorem is true for k-1 state GNFAs Let G have k states. Let G be the k-1 state GNFA obtained by ripping out a state. We already claimed L(G) = L(G ) [Sipser, p ] G has k-1 states, so by induction, L(G ) = L(CONVERT(G )) = L(R) Therefore L(R)=L(G). QED
37 b a q 1 b b a a q 2 q 3
38 bb b q 1 a a + ba b q 2
39 bb + (a + ba)b*a q 1 b + (a + ba)b* (bb + (a + ba)b*a)* (b + (a + ba)b*)
40 Convert the NFA to a regular expression q 1 a, b q 2 b a b b q 3
41 Convert the NFA to a regular expression q 1 a, b q 2 b b a b q 3
42 Convert the NFA to a regular expression q 1 a (a + b)b*b bb*b q 3
43 Convert the NFA to a regular expression q 1 (a + b)b*b(bb*b)* (a + b)b*b(bb*b)*a ((a + b)b*b(bb*b)*a)*( + (a + b)b*b(bb*b)*)
44 DFAs NFAs DEFINITION Regular Languages Regular Expressions
45 Some Languages Are Not Regular: Limitations on DFAs
46 Regular or Not? C = { w w has equal number of 1s and 0s} NOT REGULAR! D = { w w has equal number of occurrences of 01 and 10 } REGULAR!
47 { w w has equal number of occurrences of 01 and 10} = { w w = 1, w = 0, or w =, or w starts with a 0 and ends with a 0, or w starts with a 1 and ends with a 1 } (0+1)*0 + 1(0+1)*1 Claim: A string w has equal occurrences of 01 and 10 w starts and ends with the same bit.
48 The Pumping Lemma: Structure in Regular Languages Let L be a regular language Then there is a positive integer P s.t. for all strings w L with w P there is a way to write w = xyz, where: 1. y > 0 (that is, y ) 2. xy P 3. For all i 0, xy i z L Why is it called the pumping lemma? The word w gets pumped into longer and longer strings
49 Proof: Let M be a DFA that recognizes L Let P be the number of states in M Let w be a string where w L and w P We show: w = xyz y 1. y > 0 2. xy P 3. xy i z L for all i 0 x z q 0 q j q k q w There must exist j and k such that 0 j < k P, and q j = q k
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