NIP Summer School 2011 `Truth and Paradox' …ac117/teaching/NIPSS_lec01.pdfTarskianism Basic...

Tarskianism Basic Paracomplete Theories Basic Paraconsistent Theories References

NIP Summer School 2011‘Truth and Paradox’ Lecture #1

Colin Caret & Aaron Cotnoir

1 Tarskianism

2 Basic Paracomplete Theories

3 Basic Paraconsistent Theories

Definition 1.1 (Formal Languages)

A formal language includes logical vocabulary ¬, ∧, ∨, →, ↔, ∀, ∃ as well asvariables x , y , z . . . and perhaps some non-logical predicates and names.

I Why do we focus on theories of truth in formal languages?

• Modeling.

• Regimentation.

to this end, we want. . .

• Tractability.

• Precision.

• Modeling.

• Regimentation.

• Tractability.

• Precision.

• Modeling.

• Regimentation.

• Tractability.

• Precision.

• Modeling.

• Regimentation.

• Tractability.

• Precision.

• Modeling.

• Regimentation.

• Tractability.

• Precision.

• Modeling.

• Regimentation.

• Tractability.

• Precision.

• Modeling.

• Regimentation.

• Tractability.

• Precision.

I Consider a formal language for arithmetic, with a special name for zeroand symbols for the successor, addition, and multiplication functions.

I In such a language we can formulate Peano Arithmetic (PA), an axiomsystem which aims to capture all truths of basic number theory.

I PA has some nice features which makes it a good testing ground fortheories of truth. We note the following, without proof.

• The vocabulary is countable and the grammar is recursive, so there is arecursive function that assigns each symbol and sentence a unique number.

• Given the above function, there are many properties of the language whoseextensions can be represented by sets of code numbers of sentences.

• All recursively definable properties have extensions which, represented bysets of code numbers, are expressible by formulas of the language itself.

I For any sentence A of PA, we use ‘pA q’ to stand for the canonical termreferring to the code number of A. We get the following result.

Lemma 1.1 (The Diagonalization Lemma)

For any sentence ϕ(x) of PA open in one variable, there is a sentence S ofPA such that the equivalence S ↔ ϕ(pS q) is a theorem of PA.

I Call the relevant sentence S the Gödel Sentence for ϕ(x).

I Such sentences are interesting precisely because they involve ameasure of self-reference, i.e. (crudely) S ‘says that’ it has property ϕ!

Gödel showed. . . that elementary syntax can be interpreted innumber theory. In this way, Gödel put the issue of the legitimacy ofself-referential sentences beyond doubt; he showed that they are asincontestably legitimate as arithmetic itself. (Kripke, 1975, p.692)

I Generalizing away from details, PA offers a model for thinking aboutlanguages in which the paradoxes of self-reference can occur.

I Going forward, we assume the legitimacy of formal languages with adevice p q of sentence-naming, and the following property.

Definition 1.2 (Having Self-reference)

Language L has self-reference iff every sentence A of L has a standardname pA q in L and every predicate ϕ(x) of L has a Gödel Sentence in L.

I Tarski (1935) established an important limitation on languages withself-reference, by a method of proof inspired by the Liar paradox.

I He argued that an adequate theory of truth should entail every instanceof the T-Schema for sentences of the language to which it applies.

T(pAq) ↔ A

I He then demonstrated a case in which this is impossible.

T(pAq) ↔ A

Theorem 1.2 (Tarski’s Undefinability Theorem)

No language with self-reference and underwritten by classical logic canformulate an adequate, non-trivial truth theory that applies to itself.

Proof Sketch

Fix a language that has self-reference and is underwritten by classical logic,and suppose for reductio that it can formulate its own adequate, non-trivialtruth theory using the unary predicate T(x). By self-reference there exists asentence L that is the Gödel Sentence for the predicate ¬T(x), i.e. (crudely) aLiar sentence which ‘says that’ it is not true. We reason, in this language:

(1) T(pLq) ↔ L follows from the adequacy of T(x)

(2) L ↔ ¬T(pLq) follows from the definition of L

(3) T(pLq) ∨ ¬T(pLq) valid by classical logic (LEM)

(4) T(pLq) ∧ ¬T(pLq) from (3) by applying (1) and (2)

And this entails everything—triviality—by classical logic (EFQ).

Proof Sketch

I Note that talk of theories is somewhat beside the point.

I We can sharpen the issue by thinking about a predicate of a languagefor which the instances of the T-Schema are simply true.

I In a slogan, a classical language with self-reference cannot contain itsown truth predicate—in the above sense—on pain of triviality!

Tarski’s Theorem is really far more than an undefinability theorem; itsays that full truth can’t appear in [a non-trivial] language even as aprimitive predicate. . . Of course, there’s something odd about thisconclusion: it should lead us to suspect that we don’t evenunderstand a concept of full truth that obeys both the Tarski schemaand classical logic. (Field, 2008, p.30)

I This perfectly captures the usual interpretation of Tarski’s Theorem as adilemma: revise the concept of truth, or revise classical logic.

I Why not take the first route? Let’s consider this briefly.

I Since a classical language with self-reference cannot contain its owntruth predicate, perhaps some other language could do so.

I This was exactly Tarski’s proposal: ascend from language Lk to definetheory X in a richer language Lk+1 such that for all sentences A of Lk :

X �k+1 Tk(pAq) ↔ A

(think of ‘Tk ’ as ‘is a true sentence of Lk ’)

I This circumvents the triviality immanent in Tarski’s Theorem by biting thebullet and accepting that no language contains its own truth predicate.

I It rules out the existence of Liar sentences (as ungrammatical).

I And the method iterates, allowing us to re-apply it to metalangauge Lk+1

by ascending to a richer metametalanguage Lk+2, and so on.

I By design, a Tarskian approach ‘fragments’ truth into many distinctconcept each of which is only applicable to a restricted language.

I This has serious drawbacks as a theory of the ordinary concept of truth(which, it is worth pointing out, was never Tarski’s intention).

I It gives the wrong analysis of certain mundane assertions. (Kripke)

Dean: Nothing that Nixon says about Watergate is true.

Nixon: Nothing that Dean says about Watergate is true.

I And it places artificial limits on our grasp of certain concepts. (Priest)

If A is ‘a true sentence of Lk ’ for some level k of the ‘hierarchy’ of languages,then A is simply true, but this predicate is not contained in any language.

I Motivation in hand, we turn to non-classical theories.

I Note the conspicuous role played in the Liar argument by the supposedly‘vacuous’ inferences of Excluded Middle (LEM) and Ex Falso (EFQ).

I The theories ahead raise the question: could LEM or EFQ be invalid?

2 B ∨ ¬B A ∧ ¬A?

I We focus on the propositional fragment of the logics we considerbecause this is where most of the ‘revisionary’ work needs to be done.

2 B ∨ ¬B A ∧ ¬A?

I A qualification is also in order: Gödel Sentences have been implicitlytreated as (provable) equivalents using the material biconditional.

I This will not always be available in the theories ahead.

I For this reason, we will often be interested in a strengthened criterion forour truth predicate that is distinct from, but in the spirit of, the T-Schema.

Definition 1.3 (Transparency)

Let β be any sentence in which sentence α occurs. Then the result ofsubstituting T(pαq) for any occurrence of α in β has the same semantic valueor same semantic status as β. (Beall, 2009, p.15)

1 Tarskianism

I We begin by considering theories that reject LEM, the so-calledparacomplete theories (para- ‘beyond’ the negation-complete).

I We will call sentences that are counterexamples to LEM GAPS.

I It is tempting to think of gaps as being ‘neither true nor false’. We shallsee later why this temptation might need to be resisted. For now, it isuseful to think of gaps simply as counterexamples to LEM.

I Why think the Liar is a gap?

I Kripke painted a picture about the ‘grounding’ of the concept of truth.

I Imagine teaching someone to use ‘true’ by saying: assert T(pAq)whenever you would assert A, deny T(pAq) whenever you would deny A.

I Suppose she sorts through every sentence of her language and appliesthese instructions in all the cases that she can (in some idealized sense).

I With the Liar and other self-referential sentences, she will suspendjudgment; the procedure never tells her to assert or deny them.

I This story involves an element like Tarskian semantic ascent.

I But the difference is that it portrays an iterated filling out of a univocalconcept of truth (rather than ‘truth-at-the-next-level’).

I The story allows that the predicate may not end up fully defined, e.g. withrespect to the Liar, she will not assert T(pLq) nor assert ¬T(pLq).

I And now we have a counterexample to LEM.

I Let us make this a bit more precise.

I Let V be any ordered set, and let x , y ∈ V.

Definition 2.1 (LUB)

The least upper bound of x , y (lub{x , y}) is the lowest valuegreater-than-or-equal-to x and y .

Definition 2.2 (GLB)

The greatest lower bound of x , y (glb{x , y}) is the highest valueless-than-or-equal to x and y .

Semantics for K3

I The set of values V for LK3is {1, n, 0}.

I These values are ordered in the following way.

Semantics for K3

I The set of values V for LK3is {1, n, 0}.

Semantics for K3

A K3 valuation is admissible iff it satisfies the following clauses.

(1) ν(A) ∈ {1, n, 0} for all atomic A.

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0n if ν(A) = n0 if ν(A) = 1

Semantics for K3

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0n if ν(A) = n0 if ν(A) = 1

Semantics for K3

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0n if ν(A) = n0 if ν(A) = 1

Semantics for K3

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0n if ν(A) = n0 if ν(A) = 1

Semantics for K3

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0n if ν(A) = n0 if ν(A) = 1

Representation in Truth Tables

¬1 0n n0 1

∧ 1 n 0

1 1 n 0

n n n 0

0 0 0 0

∨ 1 n 0

1 1 1 1

n 1 n n

0 1 n 0

→ 1 n 0

1 1 n 0

n 1 n n

0 1 1 1

↔ 1 n 0

1 1 n 0

n n n n

0 0 n 1

NB: the conditional here is the material conditional (A → B) =df. (¬A ∨ B)

Semantics for K3

Let D = {1} be a set of designated values.

I Sentence A is designated by an K3-admissible valuation ν iff ν(A) ∈ D.

I Sentence A is satisfied iff it is designated.

I �K3 A iff A is satisfied by every K3-admissible valuation.

I X �K3 A iff every K3-admissible valuation that satisfies X satisfies A.

Semantics for K3

I K3 logic is called Strong Kleene because it is due to Kleene (1950).

I It is truth-functional, and has classical logic as an extension.

I There are counterexamples to the Excluded Middle (LEM): 2K3 A ∨ ¬A.

I As such, K3 is paracomplete.

I K3 is the background logic for our basic paracomplete truth theory.

I Our base language L is classical Peano Arithmetic (PA).

I We want to extend this language with a transparent truth predicate T.

I Kripke (1975) showed us how to do this, one ‘stage’ at a time.

I The classical way of interpreting predicates is via extensions:ν(T(x)) = 1 iff x̂ ∈ T+.

I In classical logic it follows that ν(¬T(x)) = 1 iff x̂ /∈ T+. But this doesn’tleave room for objects that fail to be T and also fail to be ¬T.

I In K3 we interpret predicates via extensions and anti-extensions:

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

• (We assume nothing is in both the extension and anti-extension.)

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = n iff x̂ /∈ T+ and x̂ /∈ T−

I If L is the intended model of PA, let L0 be the result of adding T to thesyntax, but leaving the extension T+ and anti-extension T− empty. Thisis stage 0; sometimes called the ‘empty ground model’.

I At stage 1:

• Throw every sentence of L0 that receives value 1 into T+.

• Throw every sentence of L0 that receives value 0 into T−.

• Now, we close this under the rules of K3. The result is called L1

I So, at stage 1, we have ν(T(pAq)) = 1 for any true sentence ofarithmetic, and ν(T(pAq)) = 0 and hence ν(¬T(pAq)) = 1 for any falsesentence of arithmetic.

I At stage 1:

I The process continues as follows.

I At stage 2:

I So, at stage 2, we have ν(T(pT(pAq)q)) = 1 for any true sentence ofarithmetic, and ν(T(pT(pAq)q)) = 0 and hence ν(¬T(pT(pAq)q)) = 1 forany false sentence of arithmetic.

I Continue on!

I At stage 2:

I Continue on!

I At stage 2:

I Continue on!

I At stage 2:

I Continue on!

I At stage 2:

I Continue on!

I At stage 2:

I Continue on!

I At stage 2:

I Continue on!

I At some stage this process will stop; there will be a ‘fixed point’.

I Our ‘jumps’ from stage to stage will eventually result in us running out ofsentences which our ‘instructions’ will add to either T+ or T−. All thesentences that can receive value 1 or 0 will have by this fixed point.

I But there will be some sentences – the ‘ungrounded’ ones – which willnever resolve to a classical value. These sentences, like the Liar, will bestuck with value n forever.

I Kripke also showed, although we won’t prove it here, that the resultinginterpretation for T is transparent. That is a great achievement!

Problems with K3TT

I But not everything is brilliant about this approach to truth.

I There are counterexamples to Material Identity! 2K3 A → A.

→ 1 n 0

1 1 n 0

n 1 n n

0 1 1 1

I Note connection with Conditional Proof, and the Deduction Theorem:if A � A then � A → A

I As a result, there are counterexamples to the Material T-Biconditionals!2K3 T(pAq) ↔ A

Problems with K3TT

→ 1 n 0

1 1 n 0

n 1 n n

0 1 1 1

Problems with K3TT

→ 1 n 0

1 1 n 0

n 1 n n

0 1 1 1

Problems with K3TT

→ 1 n 0

1 1 n 0

n 1 n n

0 1 1 1

I Finally, there is no way of asserting of gaps that they are ‘gappy’.

I Notice, the intuitive conception of gaps as ‘neither true nor false’ wouldnaturally be formalized as ¬(T(pAq) ∨ ¬T(pAq)).

I But in the logics we have considered (and will consider in lecture 2) thisis equivalent to ¬T(pAq) ∧ T(pAq), which is the assertion of a glut.

I Furthermore, when the sentence in question, T(pAq), fails to receive aclassical value in any fixed point, so does ¬T(pAq), and thus so do thesentences T(pAq) ∧ ¬T(pAq) and ¬(T(pAq) ∨ ¬T(pAq)).

I Ł3 is nearly identical to K3 except that it treats the conditional → as asyntactic primitive, not definable in terms of the other connectives.

I Ł3-admissible valuations are K3-admissible valuations that follow thetruth table for → given below.

→ 1 n 01 1 n 0n 1 1 n0 1 1 1

I This patches one obvious weakness of K3, Identity: �Ł3A → A

I Which means that a truth theory on this logic can have T-biconditionals.

→ 1 n 01 1 n 0n 1 1 n0 1 1 1

Problems with Ł3

I But the Ł3 conditional contracts: A → (A → B) �Ł3A → B

I Contraction is (often) thought to be the problematic feature ofconditionals that lead to Curry’s paradox.

I The advanced paracomplete theories to be discussed in lecture 2attempt to address these problems.

Problems with Ł3

1 Tarskianism

I We now move on to consider theories that reject EFQ, the so-calledparaconsistent theories (para- ‘beyond’ the negation-consistent).

I We will call sentences that are counterexamples to EFQ GLUTS.

I We will speak of gluts as being ‘both true and false’. This is accurate, butin the logics we consider T(pAq) ∧ ¬T(pAq) and ¬(T(pAq) ∨ ¬T(pAq))are equivalent, so gluts are ‘gappy’ in the sense we couldn’t say of GAPS.

I Why think the Liar is a glut?

I Well, the Liar sentence means that that sentence itself is not true, it is asentence whose truth-conditions are its falsity-conditions.

I That’s suggestive, but a more interesting route is to argue that we canprove that the Liar is a glut with minimal resources.

(TS)T(pLq) → ¬T(pLq)

(¬E)¬T(pLq)

¬T(pLq)(def. L)

L(Nec)

T(pLq)(∧I)

T(pLq) ∧ ¬T(pLq)

(¬E)¬T(pLq)

¬T(pLq)(def. L)

L(Nec)

T(pLq)(∧I)

T(pLq) ∧ ¬T(pLq)

(¬E)¬T(pLq)

¬T(pLq)(def. L)

L(Nec)

T(pLq)(∧I)

T(pLq) ∧ ¬T(pLq)

I We can also dualise the Kripkean picture in a ‘falsificationist’ vein.

I Imagine teaching someone the rules: assert T(pAq) unless you havereason to deny A, deny T(pAq) unless you have reason to assert A.

I Suppose she sorts through every sentence of her language and appliesthese instructions in all the cases that she can (. . . idealized. . . ).

I With the Liar and other self-referential sentences, she will go back andforth so she will never have decisive reason to only assert or deny it.

I She won’t as a result of this indecisiveness accept everything, so wehave a counterexample to EFQ. Let us make this a bit more precise.

Semantics for LP

I The set of values V for LP is {1, b, 0}.

Semantics for LP

I The set of values V for LP is {1, b, 0}.

Semantics for LP

A LP valuation is admissible iff it satisfies the following clauses.

(1) ν(A) ∈ {1, b, 0} for all atomic A.

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0b if ν(A) = b0 if ν(A) = 1

Semantics for LP

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0b if ν(A) = b0 if ν(A) = 1

Semantics for LP

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0b if ν(A) = b0 if ν(A) = 1

Semantics for LP

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0b if ν(A) = b0 if ν(A) = 1

Semantics for LP

(2) ν(A ∨ B) = lub{ν(A), ν(B)}.

(3) ν(A ∧ B) = glb{ν(A), ν(B)}.

(4) ν(¬A) =

1 if ν(A) = 0b if ν(A) = b0 if ν(A) = 1

Representation in Truth Tables

¬1 0b b0 1

∧ 1 b 0

1 1 b 0

b b b 0

0 0 0 0

∨ 1 b 0

1 1 1 1

b 1 b b

0 1 b 0

→ 1 b 0

1 1 b 0

b 1 b b

0 1 1 1

↔ 1 b 0

1 1 b 0

b b b b

0 0 b 1

NB: same as K3, with only difference which elements are designated

Semantics for LP

Let D = {1, b} be a set of designated values.

I Sentence A is designated by an LP-admissible valuation ν iff ν(A) ∈ D.

I �LP A iff A is satisfied by every LP-admissible valuation.

I X �LP A iff every LP-admissible valuation that satisfies X satisfies A.

Semantics for LP

I LP is called the Logic of Paradox due to Asenjo (1966)

I There are counterexamples to Ex Falso (EFQ): A ∧ ¬A 2LP B.

I As such, LP is paraconsistent.

I LP is the background logic for our basic paraconsistent truth theory.

I Same base language PA, same procedure, extending with T ‘by stages’.

I In LP we interpret predicates via extensions and anti-extensions:

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

• We assume everything is either in the extension or anti-extension.

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

• ν(T(x)) = 1 iff x̂ ∈ T+.

• ν(T(x)) = 0 iff x̂ ∈ T−.

• ν(T(x)) = b iff x̂ ∈ T+ and x̂ ∈ T−

I Again, let L0 be the result of adding T to the syntax, but this time we letevery sentence be in both T+ and T−. This is stage 0, a ‘full groundmodel’ stage 0.

I At stage 1:

• Remove every sentence of L0 that receives value 1 from T−.

• Remove every sentence of L0 that receives value 0 from T+.

• Now, we close this under the rules of LP. The result is called L1

I This process continues just as before up through the stages.

I At stage 1:

I Again, at some stage this process will stop; there will be a ‘fixed point’.All the sentences that can receive value 1 or 0 will.

I But there will be some sentences – the very same ‘ungrounded’ ones –which will never resolve to a classical value. They will be stuck with valueb forever, always in both the extension and anti-extension of T.

I Likewise, the resulting interpretation for T is transparent. Great news!

Problems with LPTT

I But again, not everything is brilliant about this theory.

I There are counterexamples to MODUS PONENS! A → B,A 2LP B.

→ 1 b 0

1 1 b 0

b 1 b b

0 1 1 1

I Note connection with ‘Converse’ Conditional Proof and the DeductionTheorem: if A → B � A → B then A → B,A � B

I Notice also that some of the Material T-Biconditionals, the onesinstantiantiated on gluts, are false (though they are also true).

Problems with LPTT

→ 1 b 0

1 1 b 0

b 1 b b

0 1 1 1

Problems with LPTT

→ 1 b 0

1 1 b 0

b 1 b b

0 1 1 1

Problems with LPTT

→ 1 b 0

1 1 b 0

b 1 b b

0 1 1 1

I RM is nearly identical to LP except that it treats the conditional → as asyntactic primitive, not definable in terms of the other connectives.

I RM-admissible valuations are LP-admissible valuations that follow thetruth table for → given below.

→ 1 b 01 1 0 0b 1 b 00 1 1 1

I This patches one obvious weakness of LP, MPP: A → B,A �RM B

→ 1 b 01 1 0 0b 1 b 00 1 1 1

Problems with RM

I But the RM conditional also contracts: A → (A → B) �RM3 A → B

I Again, this leads to the complicated trouble of Curry’s paradox.

I The advanced paraconsistent theories to be discussed in lecture 3attempt to address these problems.

Problems with RM

References

F.G. Asenjo. A Calculus of Antinomies. Notre Dame Journal of Formal Logic,7(1):103–105, 1966.

Jc Beall. Spandrels of Truth. Oxford University Press, 2009.

Hartry Field. Saving Truth From Paradox. Oxford University Press, 2008.

Saul Kripke. Outline of a Theory of Truth. The Journal of Philosophy, 72(19):690–716, 1975.

Alfred Tarski. Der Wahrheitsbegriff in Den Formaliserten Sprachen. StudiaPhilosophica, 1:261–405, 1935. Reprinted as ‘The Concept of Truth inFormalized Languages’ in Logic, Semantics, Metamathematics,trans. J.H. Woodger, Oxford University Press, 1956.

NIP Summer School 2011 `Truth and Paradox' …ac117/teaching/NIPSS_lec01.pdfTarskianism Basic...

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Transcript of NIP Summer School 2011 `Truth and Paradox' …ac117/teaching/NIPSS_lec01.pdfTarskianism Basic...

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