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Critique this PDA for L= { u u R v v R : u ∈ {0,1}* and v ∈ {0,1}+ } u0εu0 u1εu1 uεεvε...
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Critique this PDA for L= { u u R v v R : u ∈ {0,1}* and v ∈ {0,1}+ } u 0 ε u 0 u 1 ε u 1 u ε ε v ε v 0 0 v ε v 1 1 v ε v ε ε f ε s ε ε t ε t 0 ε t 0 t 1 ε t 1 t 0 0 t ε t 1 1 t ε t ε ε u ε After you identify the bugs and inefficiencies, design a nicer PDA for this language that is correct.
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Transcript of Critique this PDA for L= { u u R v v R : u ∈ {0,1}* and v ∈ {0,1}+ } u0εu0 u1εu1 uεεvε...
Critique this PDA for L= { u uR v vR : u ∈ {0,1}* and v ∈ {0,1}+ } u 0 ε u 0
u 1 ε u 1u ε ε v εv 0 0 v εv 1 1 v εv ε ε f ε
s ε ε t εt 0 ε t 0t 1 ε t 1t 0 0 t εt 1 1 t εt ε ε u ε
After you identify the bugs and inefficiencies, design a nicer PDA for this language that is correct.
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Assignment #4 will be posted soon and will be due on Friday Nov. 18.
The FINAL final exam schedule has been posted.
CSC 320: Tuesday Dec. 6 at 2pm
Drop deadline: Oct. 31
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Languages which are not context-free
{ an bn cn : n ≥ 0}
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Languages which are not context-freeThe pumping lemma, a statement about context-free languages, is used to create proofs (by contradiction) that languages are not context-free.Closure properties can be used: Recall that intersecting a context-free language and a regular language gives a context-free language.Once we have some languages proven to not be context-free, we can give counterexamples to show that context-free languages are not closed under intersection or complement.
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The Pumping Theorem for Context-Free Languages:
Let G be a context-free grammar.Then there exists some constant k
which depends on G such that for any string w which is generated by G with |w| ≥ k,
there exists u, v, x, y, z, such that1. w= u v x y z,2. |v| + |y| ≥ 1, and 3. u vn x yn z is in L for all n ≥ 0.
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Path:S - A - T - ANon-terminal A is repeated.
To pump:Look for a path from root with a repeated non-terminal.
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To pump n times:
New yield is:= u vn x yn z
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Theorem: L = { an bn cn : n ≥ 0} is not context-free. Choose w= ak bk ck.Consider all possibilities for u, v, x, y, z:Case 1: v is in the a’sCase 2: v is in the b’sCase 3: v is in the c’sCase 4: v has both a’s and b’sCase 5: v has both b’s and c’sCase 6: v has a’s, b’s and c’s
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w= ak bk ck.Case 1: v is in the a’s Case 1.1: y is in the a’s Case 1.2: y is in the b’s Case 1.3: y is in the c’s Case 1.4: y has both a’s and b’s Case 1.5: y has both b’s and c’s Case 1.6: y has a’s, b’s and c’s
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w= ak bk ck.Case 2: v is in the b’s Case 2.1: y is in the b’s Case 2.2: y is in the c’s Case 2.3: y has both b’s and c’sCase 3: v is in the c’s Case 3.1: y is in the c’s
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w= ak bk ck.Case 4: v has both a’s and b’s Case 4.1: y is in the b’s Case 4.2: y is in the c’s Case 4.3: y has both b’s and c’sCase 5: v has both b’s and c’s Case 5.1: y is in the c’sCase 6: v has a’s, b’s and c’s Case 6.1: y is in the c’s
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Case 1: v is in the a’s Case 1.1: y is in the a’s Case 1.2: y is in the b’s Case 1.3: y is in the c’s Case 1.4: y has both a’s and b’s Case 1.5: y has both b’s and c’s Case 1.6: y has a’s, b’s and c’sCase 2: v is in the b’s Case 2.1: y is in the b’s Case 2.2: y is in the c’s Case 2.3: y has both b’s and c’s
Case 3: v is in the c’s Case 3.1: y is in the c’sCase 4: v has both a’s and b’s Case 4.1: y is in the b’s Case 4.2: y is in the c’s Case 4.3: y has b’s and c’sCase 5: v has both b’s and c’s Case 5.1: y is in the c’sCase 6: v has a’s, b’s and c’s Case 6.1: y is in the c’s
w= ak bk ck. MUST CONSIDER ALL CASES:
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Case 1: v is in the a’s Case 1.1: y is in the a’s Case 1.2: y is in the b’s Case 1.3: y is in the c’s Case 1.4: y has both a’s and b’s Case 1.5: y has both b’s and c’s Case 1.6: y has a’s, b’s and c’sCase 2: v is in the b’s Case 2.1: y is in the b’s Case 2.2: y is in the c’s Case 2.3: y has both b’s and c’sCase 3: v is in the c’s Case 3.1: y is in the c’s
Case 4: v has both a’s and b’s Case 4.1: y is in the b’s Case 4.2: y is in the c’s Case 4.3: y has b’s and c’sCase 5: v has both b’s and c’s Case 5.1: y is in the c’sCase 6: v has a’s, b’s and c’s Case 6.1: y is in the c’s
CASE A: v and y contain at most one type of symbol.CASE B: v or y has more than one type of symbol.
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Theorem: L = { an bn cn : n ≥ 0} is not context-free. Choose w= ak bk ck.CASE A: v and y contain at most one type of symbol. Pump zero times. The number of occurrences of one or two types of symbols decreases but the number of occurrences of at least one type of symbol remains the same. Hence the resulting string no longer has equal numbers of a’s, b’s and c’s.CASE B: v or y has more than one type of symbol.Pump twice. The resulting string is not in L since it is not of the form a*b*c*.
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Final formal proof (by contradiction):Theorem: L = { an bn cn : n ≥ 0} is not context-free. Assume that L is context-free. Then there exists some constant k such that for all strings w in L with length at least k, the pumping theorem holds.Choose w= ak bk ck. This string w is in L and the length of w is at least k and therefore, the pumping theorem holds.
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The Pumping Theorem for Context-Free Languages:
Let G be a context-free grammar.Then there exists some constant k
which depends on G such that for any string w which is generated by G with |w| ≥ k,
there exists u, v, x, y, z, such that1. w= u v x y z,2. |v| + |y| ≥ 1, and 3. u vn x yn z is in L for all n ≥ 0.
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Consider all ways to factor w as uvxyz such that |v| + |y| ≥ 1:CASE A: v and y contain at most one type of symbol. Pump zero times. The number of occurrences of one or two types of symbols decreases but the number of occurrences of at least one type of symbol remains the same. Hence the resulting string no longer has equal numbers of a’s, b’s and c’s.CASE B: v or y has more than one type of symbol.Pump twice. The resulting string is not in L since it is not of the form a*b*c*.
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Note that I am very careful with the wording of the proof. For example:Case 1.2: v is in the a’s, y is in the b’sFactorizations are of the form:ai aj ak-i-j br bs bk-r-s ck where j + s ≥ 1. v yPumping zero times gives:ai (aj )0 ak-i-j br (bs )0 bk-r-s ck
= ai ak-i-j br bk-r-s ck
= ak-j bk-s ck NOTE: j + s ≥ 1.If j=0: ak bk-s ck less b’s. If s=0: ak-j bk ck less a’s. If j ≠ 0 and s ≠ 0: ak-j bk-s ck more c’s than a’s or b’s.
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Theorem: L= {w in {a, b, c}* : w has the same number of a’s, b’s and c’s} is not context-free.Proof (by contradiction):Assume L is context-free. Since a context-free language intersected with a regular language must be context-free, this means that:L’ = L ⋂ a* b* c* is context-free.But L’ = { an bn cn : n ≥ 0} and hence L’ is not context-free.
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The Pumping Theorem for Context-Free Languages:
Let G be a context-free grammar.Then there exists some constant k
which depends on G such that for any string w which is generated by G with |w| ≥ k,
there exists u, v, x, y, z, such that1. w= u v x y z,2. |v| + |y| ≥ 1, and 3. u vn x yn z is in L for all n ≥ 0.
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Proof: If the string w is long enough, then there is a path from the root with a non-terminal repeated which does not have both v and y equal to the empty string.
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Take parse tree apart to get building blocks.
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To pump 0 times:
New yield is u x z= u v0 x y0 z
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To pump 2 times:
New yield is u v v x y y z = u v2 x y2 z
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To pump 3 times:
New yield is u v v v x y y y z = u v3 x y3 z
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New yield is u vn x yn z
To pump n times:
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