Formal Language Theory Problem Sheet 1
Find regular expression for the set {anbm : (n + m) is even}. 5. Give a regular expression for the following languages: (a) L = {anbm : n ? 4m ? 3}.
Lecture 4: Regular Expressions and Finite Automata
La?b? = {w ? ?? : w is of the form anbm for n m ? 0} Kleene's regular expressions
Homework 3 Solutions
Answer: Let NFA N = (Q ?
Solution to Problem Set 1
21-Jan-2003 L = {w
Graduate Program Department of Computer Science
determine the cause of the problem. A) module. B) debugger A regular expression for the set {anbm: n ? 3 m is odd} can be: (A). aaab. (B). aaabbb.
Homework 5 Solutions
(a) Your task is to design a CFG G with set of terminals T that generates exactly the regular expressions with alphabet {0 1}.
q1 q2 q3 a b b a a b
Regular Expressions. • Nonregular Languages. CS 341: Chapter 1. 1-3. Introduction Definition: If A is the set of all strings that machine M accepts.
Practice Problems for Final Exam: Solutions CS 341: Foundations of
Answer: A language is regular if and only if it has a regular expression. There exist constants c and n0 such that
Written Assignment I Solutions
Write a regular expression for this language. • The NFA recognizes all strings that contain two 0's separated by a substring whose length is a multiple of 3. •
an-introduction-to-formal-languages-and-automata-5th-edition-2011
Find a regular expression for the set {anbm:( n + m) is even}. 6. Give regular expressions for the following languages. (a) L. 1. = {nbm: n ? 4m ? 3}.
Find a regular expression for the set {anbm: n ? 3 m is odd} - Chegg
Answer to Solved Find a regular expression for the set {anbm: n ? 3 m You'll get a detailed solution from a subject matter expert that helps you
[PDF] Automata Theory Assignment Due: May 9 2008 (before Class)
Automata Theory Assignment #3 Due: May 9 2008 (before Class) 1 (10 pts) Find a regular expression for the set {anbm : n ? 3m is even} Answer:
[PDF] CS21004 - Tutorial 4 - CSE IIT Kgp
Find the regular expressions for the following languages on {a b} a L = {anbm : n ? 4m ? 3} Solution: Generate 4 or more a s follows by the requisite
[PDF] Formal Language Selected Homework Chapter 31
Find a regular expression for the set {a"b":n? 3 m is even} string is not in L if it is of the form anbm with either n < 4 or m> 3 but this does
[Solved] Consider the language L = {anbm ? n ? 4 m ? 3} Whi
From the language L = {anbm ? n ? 4 m ? 3} we can observe that In the regular expression there should be at least 4 a(s) In the r
[PDF] Homework 3 Solutions
Answer: Let NFA N = (Q ? ? 1F) where Q = {1 2 3} ? = {a b} 1 is (b) Prove that L has a regular expression where L is the set of strings
[PDF] Regular Expression & Regular Languages
A regular expression consists of strings of symbols from some alphabet ? Construct a RE for the set {anbm: n >=3 m is even}
[PDF] CSCI 3434: Theory of Computation - Lecture 4: Regular Expressions
La?b? = {w ? ?? : w is of the form anbm for n m ? 0} Kleene's regular expressions also appeared as Type-3 languages in ls lecture* pdf
CS 341: Foundations of Computer Science II
Prof. Marvin Nakayama
Homework 5 Solutions
1. Give context-free grammars that generate the following languages.
(a){w? {0,1}?|wcontains at least three1s} Answer:G= (V,Σ,R,S)with set of variablesV={S,X}, whereSis the start variable; set of terminalsΣ ={0,1}; and rulesS→X1X1X1X
X→0X|1X|ε
(b){w? {0,1}?|w=wRand|w|is even} Answer:G= (V,Σ,R,S)with set of variablesV={S}, whereSis the start variable; set of terminalsΣ ={0,1}; and rulesS→0S0|1S1|ε
(c){w? {0,1}?|the length ofwis odd and the middle symbol is0} Answer:G= (V,Σ,R,S)with set of variablesV={S}, whereSis the start variable; set of terminalsΣ ={0,1}; and rulesS→0S0|0S1|1S0|1S1|0
(d){aibjck|i,j,k≥0, andi=jori=k} Answer:G= (V,Σ,R,S)with set of variablesV={S,W,X,Y,Z}, where Sis the start variable; set of terminalsΣ ={a,b,c}; and rulesS→XY|W
X→aXb|ε
Y→cY|ε
W→aWc|Z
Z→bZ|ε
1 (e){aibjck|i,j,k≥0andi+j=k} Answer:G= (V,Σ,R,S)with set of variablesV={S,X}, whereSis the start variable; set of terminalsΣ ={a,b,c}; and rulesS→aSc|X
X→bXc|ε
(f){aibjck|i,j,k≥0andi+k=j} Answer:LetL={aibjck|i,j,k≥0andi+k=j}be the language given in the problem, and define other languages L1={aibi|i≥0},
L2={bkck|k≥0}.
Note thatL=L1◦L2because concatenating any stringaibi?L1with any stringbkck?L2results in a stringaibibkck=aibi+kck?L. Thus, ifL1has a CFGG1= (V1,Σ,R1,S1), andL2has a CFGG2= (V2,Σ,R2,S2), we can construct a CFG forL=L1◦L2by using the approach in problem 3b, as suggested in the hint. Specifically, •L1has a CFGG1= (V1,Σ,R1,S1), withV1={S1},Σ ={a,b,c},S1 as the starting variable, and rulesS1→aS1b|εinR1; •L2has a CFGG2= (V2,Σ,R2,S2), withV2={S2},Σ ={a,b,c},S2 as the starting variable, and rulesS2→bS2c|εinR2. Even thoughΣ ={a,b,c}for both CFGsG1andG2, CFGG1never generates a string withc, and CFGG2never generates a string witha. Then from problem3b, a CFGG3= (V3,Σ,R3,S3)forLhasV3=V1?V2?{S3}={S1,S2,S3}
withS3the starting variable,Σ ={a,b,c}, and rules S3→S1S2
S1→aS1b|ε
S2→bS2c|ε
(g)∅Answer:G= (V,Σ,R,S)with set of variablesV={S}, whereSis the start variable; set of terminalsΣ ={0,1}; and rulesS→S
Note that if we start a derivation, it never finishes, i.e.,S?S?S? ···, so no string is ever produced. Thus,L(G) =∅. (h) The languageAof strings of properly balanced left and right brackets: every left bracket can be paired with a unique subsequent right bracket, andevery right 2 bracket can be paired with a unique preceding left bracket. Moreover, the string between any such pair has the same property. For example,[][[[][]][]]?A. Answer:G= (V,Σ,R,S)with set of variablesV={S}, whereSis the start variable; set of terminalsΣ ={[,]}; and rulesS→ε|SS|[S]
2. LetT={0,1,(,),?,?,∅, e}. We may think ofTas the set of symbols used by
regular expressions over the alphabet{0,1}; the only difference is that we useefor symbolε, to avoid potential confusion in what follows. (a) Your task is to design a CFGGwith set of terminalsTthat generates exactly the regular expressions with alphabet{0,1}. Answer:G= (V,Σ,R,S)with set of variablesV={S}, whereSis the start variable; set of terminalsΣ =T; and rulesS→S?S|SS|S?|(S)|0|1| ∅ |e
(b) Using your CFGG, give a derivation and the corresponding parse tree for the string(0?(10)?1)?.Answer:A derivation for(0?(10)?1)?is
S?S??(S)??(S?S)??(0?S)??(0?SS)??(0?S?S)?
?(0?(S)?S)??(0?(SS)?S)??(0?(1S)?S)? ?(0?(10)?S)??(0?(10)?1)? and the corresponding parse tree is 3 S S (S) S?S 0S S S?1 (S) S S 1 03. (a) Suppose that languageA1has a context-free grammarG1= (V1,Σ,R1,S1),
and languageA2has a context-free grammarG2= (V2,Σ,R2,S2), where, for i= 1,2,Viis the set of variables,Riis the set of rules, andSiis the start variable for CFGGi. The CFGs have the same set of terminalsΣ. Assume thatV1∩V2= ∅. Define another CFGG3= (V3,Σ,R3,S3)withV3=V1?V2?{S3}, where S3??V1?V2, andR3=R1?R2? {S3→S1, S3→S2}. Argue thatG3
generates the languageA1?A2. Thus, conclude that the class of context-free languages is closed under union. Answer:LetA3=A1?A2, and we need to show thatL(G3) =A3. To do this, we need to prove thatL(G3)?A3andA3?L(G3). To show that L(G3)?A3, first consider any stringw?L(G3). Sincew?L(G3), we have thatS3??w. Since the only rules inR3withS3on the left side are S3→S1|S2, we must have thatS3?S1??worS3?S2??w. Suppose
first thatS3?S1??w. SinceS1?V1and we assumed thatV1∩V2=∅, the derivationS1??wmust only use variables inV1and rules inR1, which implies thatw?A1. Similarly, ifS3?S2??w, then we must have thatw?A2.Thus,w?A3=A1?A2, soL(G3)?A3.
To show thatA3?L(G3), first suppose thatw?A3. This impliesw?A1or w?A2. Ifw?A1, thenS1??w. But thenS3?S1??w, sow?L(G3). 4 Similarly, ifw?A2, thenS2??w. But thenS3?S2??w, sow?L(G3). Thus,A3?L(G3), and since we previously showed thatL(G3)?A3, it follows thatL(G3) =A3; i.e., the CFGG3generates the languageA1?A2. (b) Prove that the class of context-free languages is closed under concatenation. Answer:Suppose that languageA1has a context-free grammarG1= (V1,Σ,R1,S1), and languageA2has a context-free grammarG2= (V2,Σ,R2,S2), where, for i= 1,2,Viis the set of variables,Riis the set of rules, andSiis the start variable for CFGGi. The CFGs have the same set of terminalsΣ. Assume thatV1∩V2=∅. Then a CFG forA1◦A2isG3= (V3,Σ,R3,S3)with V3=V1?V2?{S3}, whereS3??V1?V2, andR3=R1?R2?{S3→S1S2}.
To understand whyL(G3) =A1◦A2, note that any stringw?A1◦A2can be written asw=uv, whereu?A1andv?A2. It follows thatS1??uand S2??v, soS3?S1S2??uS2??uv, sow=uv?L(G3). This proves that
A1◦A2?L(G3).
To prove thatL(G3)?A1◦A2, consider any stringw?L(G3). Sincew? L(G3), it follows thatS3??w. The only rule inR3withS3on the left side is S3→S1S2, soS3?S1S2??w. SinceV1∩V2=∅, any derivation starting
fromS1can only generate a string inA1, and any derivation starting fromS2 can only generate a string inA2. Thus, sinceS3?S1S2??w, it must be that wis the concatenation of a string fromA1with a string fromA2. Therefore, w?A1◦A2, which establishes thatL(G3)?A1◦A2. (c) Prove that the class of context-free languages is closed under Kleene-star. Answer:Suppose that languageAhas a context-free grammarG1= (V1,Σ,R1,S1). Then a CFG forA?isG2= (V2,Σ,R2,S2)withV2=V1? {S2}, where S2??V1, andR2=R1? {S2→S1S2, S2→ε}.
To show thatL(G2) =A?, we first prove thatA??L(G2). Consider any stringw?A?. We can writew=w1w2···wnfor somen≥0, where each w i?A. (Here, we interpretw=w1w2···wnforn= 0to bew=ε.) Since eachwi?A, we have thatS1??wi. To derive the stringwusing CFGG2, we first apply the ruleS2→S1S2a total ofntimes, followed by one application of the ruleS2→ε. Then for theithS1, we useS1??wi. Thus, we get S2??S1S1···S1?
ntimesS2?S1S1···S1????
ntimes? ?w1w2···wn=wTherefore,w?L(G2), soA??L(G2).
To show thatL(G2)?A?, suppose we apply the ruleS→S1S2a total of n≥0times, followed by an application of the ruleS2→ε. This gives S2??S1S1···S1?
ntimesS2?S1S1···S1????
ntimes. 5 Now each of the variablesS1can be used to derive a stringwi?A, i.e., from the ithS1, we getS1??wi. Thus, S2??S1S1···S1?
ntimes? ?w1w2···wn?A? since eachwi?A. Therefore, we end up with a string inA?. To convince ourselves that the productions applied to the various separateS1terms do not interfere in undesired ways, we need only think of the parse tree. EachS1is the root of a distinct branch, and the rules along one branch do not affect those on another. Here, we assumed that we first applied the ruleS2→S1S2a total of ntimes, then applied the ruleS2→ε, and then applied rules to change each S1into strings. However, we could have applied the rules in a different order, as
long as the ruleS2→εis applied only after thenapplications ofS2→S1S2. By examining the parse tree, we can argue as before that the order in which we applied the rules doesn"t matter.4. Convert the following CFG into an equivalent CFG in Chomsky normalform, using
the procedure given in Theorem 2.9.S→BSB|B|ε
B→00|ε
Answer:First introduce new start variableS0and the new ruleS0→S, which gives S0→S
S→BSB|B|ε
B→00|ε
Then we removeεrules:
•RemovingB→εyields S0→S
S→BSB|BS|SB|S|B|ε
B→00
•RemovingS→εyields S0→S|ε
S→BSB|BS|SB|S|B|BB
B→00
•We don"t need to remove theε-ruleS0→εsinceS0is the start variable and that is allowed in Chomsky normal form. 6Then we remove unit rules:
•RemovingS→Syields S0→S|ε
S→BSB|BS|SB|B|BB
B→00
•RemovingS→Byields S0→S|ε
S→BSB|BS|SB|00|BB
B→00
•RemovingS0→Sgives S0→BSB|BS|SB|00|BB|ε
S→BSB|BS|SB|00|BB
B→00
Then we replaced ill-placed terminals0by variableUwith new ruleU→0, which gives S0→BSB|BS|SB|UU|BB|ε
S→BSB|BS|SB|UU|BB
B→UU
U→0
Then we shorten rules with a long RHS to a sequence of RHS"s with only 2variables each. So the ruleS0→BSBis replaced by the 2 rulesS0→BA1andA1→SB. Also the ruleS→BSBis replaced by the 2 rulesS→BA2andA2→SB. Thus, our final CFG in Chomsky normal form is S0→BA1|BS|SB|UU|BB|ε
S→BA2|BS|SB|UU|BB
B→UU
U→0
A1→SB
A2→SB
To be precise, the CFG in Chomsky normal form isG= (V,Σ,R,S0), where the set of variables isV={S0,S,B,U,A1,A2}, the start variable isS0, the set of terminals isΣ ={0}, and the rulesRare given above. 75. (a) The CFGGderives the string- - -5as
S? -S? - -S? - - -S? - - -5
so- - -5?L(G). The CFGGderives the string2 +- -4asS?S+S?S+-S?S+- -S?2 +- -S?2 +- -4
so2 +- -4?L(G). (b) To prevent generating strings such as in part (a), we can use the CFGG?= (V?,Σ,R?,S), whereV?={S,N}is the set of variables withSas the starting variable, alphabetΣ ={+,-,×,/,(,),0,1,2,...,9}, and rulesR?asS→S+S|S-S|S×S|S/S|(S)|N| -N
N→0|1| ··· |9
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