Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Semantic equivalence and normal forms α β if wα = wβ for all w From syllogism to common sense: ≡ atourthroughthelogicallandscape Replacement Theorem: if α α then ϕ[α/α] ϕ, ≡ ≡ i.e., if a subformula α of ϕ is replaced by α α in ϕ, ≡ Propositional logic 3 then the resulting formula is equivalent to ϕ Negation normal form (NNF) is established by Mehul Bhatt Oliver Kutz Thomas Schneider “pulling negation inwards”, interchanging and ∧ ∨ Disjunctive normal form (DNF) of fct f is established by 8 December 2011 describing all lines with function value 1 in truth table Conjunctive normal form (CNF): analogous, dual Thomas Schneider Propositional logic 3 Thomas Schneider Propositional logic 3 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Functional completeness and duality Tautologies etc. α is a tautology if w = α (wα = 1) for all w | Signature S is functional complete: α is satisfiable if w = α for some w every Boolean fct is represented by some fma in S | α α Examples: , , , , , 0 , , is a contradiction if is not satisfiable {¬ ∧} {¬ ∨} {→ } {↑} {↓} Counterexample: , , {→ ∧ ∨} Satisfiability can be decided in nondeterministic polynomial time (NP) and is NP-hard. Dual formula: interchange and ∧ ∨ Analogous for tautology property: coNP-complete Dual function: negate arguments and function value α is a logical consequence of X (X = α) δ δ | Duality theorem: If α represents f ,thenα represents f . if w(w = X w = α) ∀ | ⇒ | = enjoys certain general properties | Thomas Schneider Propositional logic 3 Thomas Schneider Propositional logic 3 22 1 Propositional Logic Cutback Natural deduction Hilbert calculi Cutback1.4 A Calculus of NaturalNatural deduction Deduction Hilbert calculi And now . What’sWe will in now this define section? a derivability relation by means of a calculus op- erating solely with some structural rules. turns out to be identical to the consequence relation .Thecalculus is of the so-called Gentzen typeWe and want its to rules . are given with respect to pairs (X, α) of formulas X and formulas α.Anothercalculusfor,oftheHilberttype,willbecon- sideredfind in 1.6 a means.Indistinctionto[ to “compute”Ge],= wesyntactically do not require: that X be finite; 1 What happened last time? | our particular goals here make such a restriction dispensable. If applies to thedefine pair (X, a derivabilityα) then we relation write X byα meansand say of that a calculusα is derivable or provablethatfrom operatesX (made solely precise on the below); structure otherwise of formulas we write X α. 2 A calculus of natural deduction Followingprove [ thatKl1], Gentzen’sand = are name identical for (X, α), Sequenz,istranslatedas sequent.Thecalculusisformulatedintermsof | , and encompasses the ∧ ¬ six rules below, called the basic rules.Howtooperatewiththeseruleswill 3 Hilbert calculi be explained afterwards. The choice of , as the logical signature is The calculus is of the Gentzen type{ ∧ ¬} amatterofconvenienceandjustifiedbyitsfunctionalcompleteness.The other(Gerhard standard Gentzen, connectives 1909–1945, are German introduced mathematician/logician, by the definitions GÖ, Prague) α β := ( α β), α β := (α β), α β := (α β) (β α). ∨ ¬ ¬ ∧ ¬ → ¬ ∧ ¬ ↔ → ∧ → , are defined as on page 5.Ofcourse,onecouldchooseanyother ⊥ Thomas Schneider Propositional logic 3 52 functionalThomas Schneider complete signaturePropositional and adapt logic the 3 basic rules correspondingly. 53 But it should be observed that a complete calculus in , , , , say, ¬ ∧ ∨ → must also include basic rules concerning and ,whichmakesinduction ∨ → arguments on the basic rules of the calculus more lengthy. Each of the basic rules below has certain premises and a conclusion. Only (IS) has no premises. It allows the derivation of all sequents α α. Cutback Natural deduction Hilbert calculi CutbackThese are called the initial sequents,Natural deduction because each derivation mustHilbert start calculi Basic notation Thewith basic these. rules (MR), the monotonicity rule,couldbeweakened.Itbecomes even provable if all pairs (X, α) with α X are called initial sequents. ∈ X α (IS) (initial sequent) (MR) (X X), α α X α ⊇ X α, β X α β Again, use α for formulas and X for sets thereof ( 1) ( 2) ∧ ∧ X α β ∧ X α, β Write X α to denote: “α is derivable from X” ∧ X α, α X, α β X, α β ( 1) ¬ ( 2) ¬ Gentzen called the pairs (X, α) in the -relation sequents ¬ X β ¬ X β sequent calculus consists of 6 basic rules (for , ) From W. Rautenberg: A Concise Introduction to Mathematical Logic, Springer, 2010. {∧ ¬} of the form premise use convenience notation as for =, see Slide 48 (last week) | conclusion (IS) has no premises; initial sequences start derivations (MR): monotonicity rule ( 1), ( 1), ( 2) have two premises; ∧ ¬ ¬ ( 2) has two conclusions ❀ is actually 2 rules ∧ Thomas Schneider Propositional logic 3 54 Thomas Schneider Propositional logic 3 55 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Using the calculus Examples 1 α α (IS) 2 α, β α (MR) 1 Derivation = finite sequence S ,...,S of sequents 3 β β (IS) 0 n where every S is either 4 α, β β (MR) 3 i 5 α, β α β ( 1) 2, 4 α, β α β an initial sequent or ∧ ∧ ⇒ { } ∧ is obtained by applying some basic rule to elements from S0,...,Si 1 − 1 p p p p (IS) ∧ ¬ ∧ ¬ 2 p p p ( 2) 1 α is derivable from X,writtenX α, ∧ ¬ ∧ 3 p p p ( 2) 1 if there is a derivation with Sn = X α. ∧ ¬ ¬ ∧ 4 p p (p p) ( 1) 2, 3 ∧ ¬ ¬ ∧ ¬ ¬ 5 (p p) (p p) (IS) ¬ ∧ ¬ ¬ ∧ ¬ 6 (p p) ( 2) 4, 5 ∅¬ ∧ ¬ ¬ ⇒ Thomas Schneider Propositional logic 3 56 Thomas Schneider Propositional logic 3 57 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Derivable rules Further derivable rules Derivations can be long (see exercise sheet) X α X, α β | cut rule Use derivable rules as “shortcuts” X β for frequently occurring patterns in derivations Examples: X α β → -elimination 1 α α (IS) X, α β → X, α α ¬ 2 X, α α (MR) 1 X α 3 X, α α supposition ¬ X, α β -elimination 4 X α ( 2) -introduction syntactic deduction theorem ¬ ¬ X α β → → X, α β, β 1 X, α β, β supposition ¬ ¬ ¬ ¬ X α, α β X α 2 X, α α ( 1) → detachment rule syntactic modus ponens ¬ ¬ X β 3 X α -elimination 2 reductio ad ¬ absurdum Thomas Schneider Propositional logic 3 58 Thomas Schneider Propositional logic 3 59 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Relation between and = Soundness is the easier direction ... | Theorem (Soundness of ) is semantically sound, i.e., X, α : X α X = α ∀ ⇒ | Goal: show = = ,i.e., X α iff X = α for all X, α | | Proof. Let X α. valid derivation S1,...,Sn with Sn = X α. Direction or : (semantical) soundness of ⇒∃ ⊆ ⇒ Induction on n. (each fma derivable from X is a semantic consequence of X) n = 1. S = α α,andα = α obviously holds. ⇒ 1 | Direction or : (semantical) completeness of n ❀ n + 1. Consider Sn+1 in S1,...,Sn+1. ⊇ ⇐ (each semantic consequence of X can be derived from X) Either S = α α (then argue as for n = 1) n+1 Si = X α or Sn+1 is obtained by applying some rule, e.g., S = X α n+1 induction hypothesis: X = α | since rules preserve the consequence relation (see exercise), we can conclude X = α | ✷ Thomas Schneider Propositional logic 3 60 Thomas Schneider Propositional logic 3 61 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Finiteness Formal consistency . is a property crucial to the completeness proof Another property that can be proven using induction on derivation length: ... will turn out to be the -equivalent of satisfiability Definition: Theorem (Finiteness theorem for ) Set X of fmas is inconsistent if X α for all fmas α, If X α,thenthereisafinitesubsetX X with X α. 0 ⊆ 0 consistent otherwise. X is maximally consistent Intuitive justification: if X is consistent but each Y X is inconsistent ⊇ Every derivation has finite length Observations: Only finitely many formulas can “accumulate” in X X inconsistent iff X ⇒ ⊥ during a derivation (for “ ” use = (p p) and rules ( 2), ( 1)) ⇐ ⊥ ∧ ¬ ∧ ¬ ❀ X maximally consistent iff α : either α X or α X ∀ ∈ ¬ ∈ Thomas Schneider Propositional logic 3 62 Thomas Schneider Propositional logic 3 63 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Helpful properties of Consistent sets are satisfiable (I) Lemma Lemma (Lindenbaum’s lemma) The derivability relation has the following properties. + Every consistent set X C : X α iff X, α C− : X α iff X, α ⊆ F ¬ ⊥ ¬ ⊥ can be extended to a maximally consistent set X X. ⊇ Proof: Exercise. (Adolf Lindenbaum, 1904–1941, Polish logician/mathematician, Warsaw) Proof sketch: This lemma helps with our goal of showing = : | ⊆ Enumerate all formulas α , α ,... “= ”iff X, α : X α X = α 0 1 | ⊆ ∀ ⇒ | + For every i = 0, 1,...: By C , X α iff X := X α is consistent ∪ {¬ } if X α is consistent, then add α to X. ∪ { i } i By definition of =, X = α iff X satisfiable | | X is the limit of this extension procedure Suffices to show: consistent sets are satisfiable ⇒ Thomas Schneider Propositional logic 3 64 Thomas Schneider Propositional logic 3 65 Cutback Natural deduction Hilbert calculi Cutback Natural deduction Hilbert calculi Consistent sets are satisfiable (II) Consistent sets are satisfiable (III) Lemma Lemma ( ) Every maximally consistent set X is satisfiable. ¬ For every maximally consistent set X and every α : Proof. Define valuation w by: w = p iff X p ⊆ F ∈ F | Show by induction α : X α iff w = α. α α ∀ | X iff X ( ) (This implies w = X, which completes the proof.) ¬ ¬ | Base case (α = p) follows from definition of w. Proof. Induction step for , : “ ” Due to consistency of X. ∧ ¬ ⇒ X α β X α, β (rules ( 1), ( 2)) “ ” If X α,thenX, α is consistent due to C+.