Turing Machines Flashcards

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Definition 3.1 (Turing machine)

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A Turing machine is a 7-tuple, M = (Q, Σ, Γ, δ, q0, qaccept, qreject), where Q, Σ, Γ are all finite sets and

  1. Q is the set of states,
  2. Σ is the input alphabet not containing the blank symbol t
  3. Γ is the tape alphabet, where t ∈ Γ and Σ ⊆ Γ,
  4. δ : Q × Γ → Q × Γ × {L, R} is the transition function,
  5. q0 ∈ Q is the start state,
  6. qaccept ∈ Q is the accept state, and
  7. qreject ∈ Q is the reject state, where qreject != qaccept.
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Definition 3.2 (Configuration of a TM)

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Let M = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a Turing machine, u ∈ Γ

, v ∈ Γ
ω and q ∈ Q. The setting
u q v
is a configuration of the Turing machine, where
u is the current tape content to left of the head,
q is the current state, and
v is the current tape content below (v1) and to
the right of the head (being terminated by
blanks t).

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Definition 3.3 Let Σ be an alphabet. Then Σω …

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is the set of all infinite strings over Σ.

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Definition 3.4 Yield TM

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Let M = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a Turing machine, a, b, c ∈ Γ, u ∈ Γ∗, v ∈ Γω and qi
, qj ∈ Q. A configuration C1 yields a configuration C2 if M can
legally go from C1 to C2 in a single step. Hence, we say
ˆ (leftward move): ua qi bv yields u qj acv
if it holds δ(qi
, b) = (qj , c, L),
ˆ (rightward move): ua qi bv yields uac qj v
if it holds δ(qi
, b) = (qj , c, R),
ˆ (L-move, left tape end): qi bv yields qj cv
if it holds δ(qi
, b) = (qj , c, L),
ˆ (R-move, left tape end): qi bv yields c qj v
if it holds δ(qi
, b) = (qj , c, R).

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Definition 3.5 (Characterization of configurations)

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Let M = (Q, Σ, Γ, δ, q0, qaccept, qreject)
be a Turing machine and C = u q v a configuration of M. We call C
ˆ start configuration on input w ∈ Σ

, if u = ε, i.e. head is at leftmost end of
tape, q = q0 and v = w ◦ {t}ω
,
ˆ accepting configuration, if q = qaccept,
ˆ rejecting configuration, if q = qreject,
ˆ halting configuration, if it is accepting or rejecting configuration.

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Definition 3.6 (Accepted input & recognized language)

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Let M = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a Turing machine and w ∈ Σ
∗
its input. M
accepts w, if a sequence of configurations C1, C2, . . . , Ck exists, such that
1. C1 is start configuration on input w
2. Ci yields Ci+1, i = 1, . . . , k − 1, and
3. Ck is accepting configuration.
The language of M is
L(M) := {w ∈ Σ
∗
|M accepts w} .
We say that L(M) is recognized by M.
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Definition 3.7 (Computation of a TM)

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Let M = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a Turing machine and w ∈ Σ

its input. A
computation of M on w is a sequence of configurations C1, C2, . . ., such that
1. C1 is start configuration on input w
2. Ci yields Ci+1, i = 1, . . . , k − 1, and

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Definition 3.8 (Turing Recognizable Languages)

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A language is called Turing-recognizable or recursively enumerable if some Turing machine recognizes it.

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Definition 3.10 (Decider)

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We call a TM M a decider, if it halts on all inputs w ∈ Σ∗.

A decider M that recognizes L(M) is said to decide L(M).

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Definition 3.11 (Decidable languages)

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We call a language Turing-decidable, decidable or recursive if there exists a TM (i.e. a decider), that decides it.

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Definition 3.12 (Multitape Turing machine)

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A multitape Turing machine with k
tapes is a 7-tuple, M = (Q, Σ, Γ, δ, q0, qaccept, qreject), where Q, Σ, Γ are all finite sets
and
1. Q is the set of states,
2. Σ is the input alphabet not containing the blank symbol t
3. Γ is the tape alphabet, where t ∈ Γ and Σ ⊆ Γ,
4. δ : Q × Γ k → Q × Γ k × {L, R}^k is the transition function,
5. q0 ∈ Q is the start state,
6. qaccept ∈ Q is the accept state,
7. qreject ∈ Q is the reject state, where qreject != qaccept.

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Theorem 3.1 A language is Turing-recognizable if and only if…

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some multitape Turing machine recognizes it.

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Theorem 3.2 For every multitape Turing machine M,

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there exists a singletape Turing machine S that recognizes the same language.

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Definition 3.13 (Nondeterministic Turing machine)

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A nondeterministic Turing machine (NTM) is a 7-tuple, N = (Q, Σ, Γ, δ, q0, qaccept, qreject), where Q, Σ, Γ are all finite sets and

  1. Q is the set of states,
  2. Σ is the input alphabet not containing the blank symbol t
  3. Γ is the tape alphabet, where t ∈ Γ and Σ ⊆ Γ,
  4. δ : Q × Γ → P(Q × Γ × {L, R}) is the transition function,
  5. q0 ∈ Q is the start state,
  6. qaccept ∈ Q is the accept state.
  7. qreject ∈ Q is the reject state, where qreject != qaccept.
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Definition 3.14 (Configuration of an NTM)

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Let N = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a
nondeterministic Turing machine, u ∈ Γ∗, v ∈ Γ ω and q ∈ Q. The setting u q v is a configuration of the Turing machine, where
u is the current tape content to left of the head,
q is the current state, and
v is the current tape content below (v1) and to the
right of the head (being terminated by blanks t).

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Definition 3.15 (NTM Yield)

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Let N = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a nondeterministic Turing machine, a, b, c ∈ Γ, u ∈ Γ∗, v ∈ Γ ω and qi, qj ∈ Q. A configuration C1 yields a configuration C2 if N can legally go from C1 to C2 in a single step. Hence, we say
ˆ (leftward move): ua qi bv yields u qj acv
if it holds (qj , c, L) ∈ δ(qi, b),
ˆ (rightward move): ua qi bv yields uac qj v
if it holds (qj , c, R) ∈ δ(qi, b),
ˆ (L-move, left tape end): qi bv yields qj cv
if it holds (qj , c, L) ∈ δ(qi, b),
ˆ (R-move, left tape end): qi bv yields c qj v
if it holds (qj , c, R) ∈ δ(qi, b).

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Definition 3.16 (Accepted input & recognized language)

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Let N = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a nondeterministic Turing machine and w ∈ Σ∗
be its input. N accepts w, if a sequence of configurations C1, C2, . . . , Ck exists, such
that
1. C1 is start configuration on input w
2. Ci yields Ci+1, i = 1, . . . , k − 1, and
3. Ck is accepting configuration.

The language of N is L(N) := {w ∈ Σ∗ | N accepts w} . We say that L(N) is recognized by N.

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Definition 3.17 (Computation branch of an NTM)

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Let N = (Q, Σ, Γ, δ, q0, qaccept, qreject) be a non-deterministic Turing machine and w ∈ Σ

be its input. A computation branch of N on w is a sequence of configurations
C1, C2, . . ., such that
1. C1 is start configuration on input w
2. Ci yields Ci+1, i = 1, . . . , k − 1, and

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Theorem 3.3 A language is Turing-recognizable if and only if

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some nondeterministic Turing machine recognizes it.

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Theorem 3.4 For every nondeterministic Turing machine N,

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there exists a deterministic (singletape) Turing machine S that recognizes the same language.

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Definition 3.18 (Nondeterministic decider)

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We call a nondeterministic TM N a decider, if all valid computation branches halt on all inputs w ∈ Σ∗. A decider N that recognizes L(N) is said to decide L(N).

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Theorem 3.5 A language is decidable if and only if …

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some nondeterministic Truing machine decides it.