Diagonalization Fixed Point Exercises

Scott Garrabrant; SamEisenstat

Fixed Points

40 Diagonalization Fixed Point Exercises

by Scott Garrabrant, SamEisenstat

18th Nov 2018

AI Alignment Forum

4 min read

40 Ω 12

This is the second of three sets of fixed point exercises. The first post in this sequence is here, giving context.

Recall Cantor’s diagonal argument for the uncountability of the real numbers. Apply the same technique to convince yourself than for any set $S$ , the cardinality of $S$ is less than the cardinality of the power set $P (S)$ (i.e. there is no surjection from $S$ to $P (S)$ ).
Suppose that a nonempty set $T$ has a function $f$ from $T$ to $T$ which lacks fixed points (i.e. $f (x) \neq x$ for all $x \in T$ ). Convince yourself that there is no surjection from S to $S \to T$ , for any nonempty $S$ . (We will write the set of functions from $A$ to $B$ either as $A \to B$ or $B^{A}$ ; these are the same.)
For nonempty $S$ and $T$ , suppose you are given $g : S \to T^{S}$ a surjective function from the set $S$ to the set of functions from $S$ to $T$ , and let $f$ be a function from $T$ to itself. The previous result implies that there exists an $x$ in $T$ such that $f (x) = x$ . Can you use your proof to describe $x$ in terms of $f$ and $g$ ?
Given sets $A$ and $B$ , let $C o m p (A, B)$ denote the space of total computable functions from $A$ to $B$ . We say that a function from $C$ to $C o m p (A, B)$ is computable if and only if the corresponding function $f^{'} : C \times A \to B$ (given by $f^{'} (c, a) = f (c) (a))$ is computable. Show that there is no surjective computable function from the set $S$ of all strings to $C o m p (S, {T, F})$ .
Show that the previous result implies that there is no computable function $h a l t (x, y)$ from $S \times S \to {T, F}$ which outputs $T$ if and only if the first input is a code for a Turing machine that halts when given the second input.
Given topological spaces $A$ and $B$ , let $C o n t (A, B)$ be the space with the set of continuous functions from $A$ to $B$ as its underlying set, and with topology such that $f : C \to C o n t (A, B)$ is continuous if and only if the corresponding function $f^{'} : C \times A \to B$ (given by $f^{'} (c, a) = f (c) (a)$ ) is continuous, assuming such a space exists. Convince yourself that there is no space $X$ which continuously surjects onto $C o n t (X, S)$ , where $S$ is the circle.
In your preferred programming language, write a quine, that is, a program whose output is a string equal to its own source code.
Write a program that defines a function $f$ taking a string as input, and produces its output by applying $f$ to its source code. For example, if $f$ reverses the given string, then the program should outputs its source code backwards.
Given two sets $A$ and $B$ of sentences, let $S y n (A, B)$ be the set of all functions from $A$ to $B$ defined by substituting the Gödel number of a sentence in $A$ into a fixed formula. Let $S_{0}$ be the set of all sentences in the language of arithmetic with one unbounded universal quantifier and arbitrarily many bounded quantifiers, and let $S_{1}$ be the set of all formulas with one free variables of that same quantifier complexity. By representing syntax using arithmetic, it is possible to give a function $f \in S y n (S_{1} \times S_{1}, S_{0})$ that substitutes its second argument into its first argument. Pick some coding of formulas as natural numbers, where we denote the number coding for a formula $φ$ as $┌ φ ┐$ . Using this, show that for any formula $ϕ \in S_{1}$ , there is a formula $ψ \in S_{0}$ such that $ϕ (┌ ψ ┐) \leftrightarrow ψ$ .
(Gödel's second incompleteness theorem) In the set $S_{1}$ , there is a formula $\neg B e w$ such that $\neg B e w (┌ ψ ┐)$ holds iff the sentence $ψ$ is not provable in Peano arithmetic. Using this, show that Peano arithmetic cannot prove its own consistency.
(Löb's theorem) More generally, the diagonal lemma states that for any formula $ϕ$ with a single free variable, there is a formula $ψ$ such that, provably, $ϕ (┌ ψ ┐) \leftrightarrow ψ$ . Now, suppose that Peano arithmetic proves that $B e w (ψ) \to ψ$ for some formula $ψ$ . Show that Peano arithmetic also proves $ψ$ itself. Some facts that you may need are that (a) when a sentence $ψ$ is provable, the sentence $B e w (ψ)$ is itself provable, (b) Peano arithmetic proves this fact, that is, Peano arithmetic proves $B e w (ψ) \to B e w (B e w (ψ))$ , for any sentence $ψ$ and (c) Peano arithmetic proves the fact that if $χ$ and $χ \to ζ$ are provable, then $ζ$ is provable.
(Tarski's theorem) Show that there does not exist a formula $ϕ$ with one free variable such that for each sentence $ψ$ , the statement $ϕ (┌ ψ ┐) \leftrightarrow ψ$ holds.
Looking back at all these exercises, think about the relationship between them.

Please use the spoilers feature - the symbol '>' followed by '!' followed by space -in your comments to hide all solutions, partial solutions, and other discussions of the math. The comments will be moderated strictly to hide spoilers!

I recommend putting all the object level points in spoilers and including metadata outside of the spoilers, like so: "I think I've solved problem #5, here's my solution <spoilers>" or "I'd like help with problem #3, here's what I understand <spoilers>" so that people can choose what to read.

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[-]Adele Lopez6yΩ4130

Ex 8: (in Python, using a reversal function)

def f(s):
return s[::-1]

dlmt = '"""'
code = """def f(s):
return s[::-1]

dlmt = '{}'
code = {}{}{}
code = code.format(dlmt, dlmt, code, dlmt)
print(f(code))"""
code = code.format(dlmt, dlmt, code, dlmt)
print(f(code))

[-]Rafael Harth6yΩ4130

Ex 4

Given a computable function $ϕ : S \mapsto Comp (S, {T, F})$ , define a function $f : S \mapsto {T, F}$ by the rule $f (s) = {\begin{matrix} T & ϕ (s) (s) = F F & ϕ (s) (s) = T \end{matrix}$ . Then $f$ is computable, however, $f \notin ϕ (S)$ because for $s \in S$ , we have that $ϕ (s) (s) = F ⟹ f (s) = T ⟹ ϕ (s) \neq f$ and $ϕ (s) (s) = T ⟹ f (s) = F ⟹ ϕ (s) \neq f$ .

Ex 5:

We show the contrapositive: given a function halt, we construct a surjective function $f$ from $S$ to $Comp (S, {T, F})$ as follows: enumerate all turing machines, such that each corresponds to a string. Given a $t \in S$ , if $t$ does not decode to a turing machine, set $f (t) \equiv F$ . If it does, let $[t]$ denote that turning machine. Let $f (t)$ with input $s \in S$ first run halt $(t, s)$ ; if halt returns $F$ , put out $F$ , otherwise $[t]$ will halt on input $s$ ; run $[t]$ on $s$ and put out the result.

Given a computable function $g : S \mapsto {T, F}$ , there is a string $t^{*} \in S$ such that $[t^{*}]$ implements $g$ (if the turing thesis is true). Then $g = f (t^{*})$ , so that $f$ is surjective.

Ex 6:

Let $h : R \mapsto S$ be a parametrization of the circle given by $h (r) \mapsto (cos (r), sin (r))$ . Given $p \in S$ and $r \in R$ , write $p + r$ to denote the point $h (p^{'} + r)$ , where $p^{'} \in h^{- 1} ({p})$ . First, note that, regardless of the topology on $X$ , it holds true that if $f : X \mapsto S$ is continuous, then so is $f_{r} : x \mapsto f (x) + r$ for any $r \in R$ , because given a basis element $(h (a), h (b))$ of the circle, we have $f_{r}^{- 1} (B) = f^{- 1} (h (a) - r, h (b) - r)$ which is open because $f$ is continuous.

Let $ϕ$ be a continuous function from $X$ to $Cont (X, S)$ . Then $ϕ^{'} : X \times X \mapsto S$ is continuous, and so is the diagonal function $h : x \mapsto ϕ (x, x)$ . Fix any $r \in (0, 2 π)$ , then $f : X \mapsto S$ given by $f : x \mapsto (ϕ^{'} (x, x) + r))$ is also continuous, but given any $x \in X$ , one has $ϕ (x) (x) = ϕ^{'} (x, x) \neq ϕ^{'} (x, x) + r = f (x)$ and thus $ϕ (x) \neq f$ . It follows that $ϕ$ is not surjective.

Ex 7:

I did it in java. There's probably easier ways to do this, especially in other languages, but it still works. It was incredibly fun to do. My basic idea was to have a loop iterate 2 times, the first time printing the program, the second time printing the printing command. Escaping the " characters is the biggest problem, the main idea here was to have a string q that equals " in the first iteration and " + q + " in the second. That second string (as part of the code in an expression where a string is printed) will print itself in the console output. Code:

package maths;public class Quine{public static void main(String[]args){for(int i=0;i<2;i++){String o=i==1?""+(char)34:"";String q=""+(char)34;q=i==1?q+"+q+"+q:q;String e=i==1?o+"+e);}}}":"System.out.print(o+";System.out.print(o+"package maths;public class Quine{public static void main(String[]args){for(int i=0;i<2;i++){String o=i==1?"+q+""+q+"+(char)34:"+q+""+q+";String q="+q+""+q+"+(char)34;q=i==1?q+"+q+"+q+"+q+"+q:q;String e=i==1?o+"+q+"+e);}}}"+q+":"+q+"System.out.print(o+"+q+";"+e);}}}

[-]Czynski6yΩ3120

For #6, I have what looks to me like a counterexample. Possibly I am using the wrong definition of continuous function? I am taking this one as my source.

Take as the topological space $X$ the real line under the Euclidean topology. Let $f^{'} (x, y)$ be the point in $S_{1}$ at $(x + y)$ radians rotation. This is surjective; all points in $S_{1}$ are mapped to infinitely many times. It is also continuous; For every $(x, y) \in X, X$ and neighborhood $N (f^{'} (x, y))$ there is a neighborhood $M (x, y)$ such that $\forall p \in M$ , $f (p) \in N$

The partial functions f(x) from $X \to S_{1}$ are also continuous by the same argument.

[-]Adele Lopez6yΩ230

Currying doesn't preserve surjectivity. As a simple example, you can easily find a surjective function $2 \times 2 \to 2$ , but there are no surjective functions $2 \to 2^{2}$ .

[-]Czynski6yΩ220

Ah, yes, that makes sense. I got distracted by the definition of $C o n t (A, B)$ 's topology

and applied it to surjectivity as well as continuity.

[-]riceissa6y110

Thoughts on #10:

I am confused about this exercise. The standard/modern proof of Gödel's second incompleteness theorem uses the Hilbert–Bernays–Löb derivability conditions, which are stated as (a), (b), (c) in exercise #11. If the exercises are meant to be solved in sequence, this seems to imply that #10 is solvable without using the derivability conditions. I tried doing this for a while without getting anywhere.

Maybe another way to state my confusion is that I'm pretty sure that up to exercise #10, nothing that distinguishes Peano arithmetic from Robinson arithmetic has been introduced (it is only with the introduction of the derivability conditions in #11 that this difference becomes apparent). It looks like there is a version of the second incompleteness theorem for Robinson arithmetic, but the paper says "The proof is by the construction of a nonstandard model in which this formula [i.e. formula expressing consistency] is false", so I'm guessing this proof won't work for Peano arithmetic.

[-]riceissa6y110

My solution for #12:

Suppose for the sake of contradiction that such a formula $ϕ$ exists. By the diagonal lemma applied to $\neg ϕ$ , there is some sentence $ψ$ such that, provably, $\neg ϕ (┌ ψ ┐) \leftrightarrow ψ$ . By the soundness of our theory, in fact $\neg ϕ (┌ ψ ┐) \leftrightarrow ψ$ . But by the property for $ϕ$ we also have $ϕ (┌ ψ ┐) \leftrightarrow ψ$ , which means $\neg ϕ (┌ ψ ┐) \leftrightarrow ϕ (┌ ψ ┐)$ , a contradiction.

This seems to be the "semantic" version of the theorem, where the property for $ϕ$ is stated outside the system. There is also a "syntactic" version where the property for $ϕ$ is stated within the system.

[-]Gurkenglas6yΩ3110

Let f be such a surjection. Construct a member of P(S) outside f's image by differing from each f(x) in whether it contains x.

A nonempty set has functions without a fixed point iff it has at least two elements. It suffices to show that there is no surjection from S to S -> 2, which is analogous to #1.

T has only one element. Use that one.

#7 Haskell

source = "main = putStrLn (\"source = \" ++ show source ++ \"\\n\" ++ source)"
main = putStrLn ("source = " ++ show source ++ "\n" ++ source)

Is #8 supposed to read "Write a program that takes a function f taking a string as input as input, and produces its output by applying f to its source code. For example, if f reverses the given string, then the program should outputs its source code backwards."?

If so, here.

source = "onme = putStrLn $ f $ \"source = \" ++ show source ++ \"\\n\" ++ source"
onme f = putStrLn $ f $ "source = " ++ show source ++ "\n" ++ source

[-]Rafael Harth6yΩ3110

Ex 1

Exercise 1: Let $f : S \mapsto P (S)$ and let $A = {x \in S | x \notin f (x)}$ . Suppose that $A \in f (S)$ , then let $x \in S$ be an element such that $f (x) = A$ . Then $x \notin f (x) = A ⟹ x \in A$ by definition, and $x \in A = f (x) ⟹ x \notin A$ . So $x \notin A ⟺ x \in A$ , a contradiction. Hence $A \notin f (S)$ , so that $f$ is not surjective.

Ex 2

Exercise 2: Since $T$ is nonempty, it contains at least one element $t_{0}$ . Let $h : T \mapsto T$ be a function without a fixed point, then $t_{0} \neq h (t_{0}) =: t_{1}$ , so that $t_{0}$ and $t_{1}$ are two different elements in $T$ (this is the only thing we shall use the function $h$ for).

Let $Ψ : S \mapsto T^{S}$ for $S$ nonempty. Suppose by contradiction that $Ψ$ is surjective. Define a map $f : S \mapsto P (S)$ by the rule $f (x) = {s \in S | Ψ (x) (s) = t_{0}}$ . Given any subset $U \subset S$ , let $g : S \mapsto T$ be given by $g : x \mapsto {\begin{matrix} t_{0} & x \in U t_{1} & x \notin U \end{matrix}$ Since $Ψ$ is surjective, we find a $s^{*} \in S$ such that $Ψ (s^{*}) = g$ . Then $f (s^{*}) = U$ . This proves that $f$ is surjective, which contradicts the result from (a).

Ex 3

Exercise 3: By (2) we know that $T = {x}$ , and so $f = {(x, x)}$ and $g = {(s, h) | s \in S}$ where $h = {(s, x) | s \in S}$ . That means $x = g (s) (s^{'}) = f^{n} (g (s) (s^{'}))$ for any $s, s^{'} \in S$ . and $n \in N$ .

[-]riceissa6y100

Attempted solution and some thoughts on #9:

Define a formula $ξ (v)$ taking one free variable to be $f (┌ ϕ ┐, ┌ f (v, v) ┐)$ .

Now define $ψ$ to be $f (┌ ξ ┐, ┌ ξ ┐)$ . By the definition of $f$ we have $ψ \leftrightarrow ξ (┌ ξ ┐)$ .

We have $ϕ (┌ ψ ┐) \leftrightarrow f (┌ ϕ ┐, ┌ ψ ┐) \leftrightarrow f (┌ ϕ ┐, ┌ f (┌ ξ ┐, ┌ ξ ┐) ┐) \leftrightarrow ξ (┌ ξ ┐) \leftrightarrow ψ$

The first step follows by the definition of $f$ , the second by the definition of $ψ$ , the third by the definition of $ξ$ , and the fourth by the property of $ψ$ mentioned above. Since $ψ \in S_{0}$ by the type signature of $f$ , this completes the proof.

Things I'm not sure about:

It's a little unclear to me what the $S y n (A, B)$ notation means. In particular, I've assumed that $f$ takes as inputs Gödel numbers of formulas rather than the formulas themselves. If $f$ takes as inputs the formulas themselves, then I don't think we can assume that the formula $ξ$ exists without doing more arithmetization work (i.e. the equivalent of $ξ$ would need to know how to convert from the Gödel number of a formula to the formula itself).

If the biconditional " $\leftrightarrow$ " is a connective in the logic itself, then I think the same proof works but we would need to assume more about $f$ than is given in the problem statement, namely that the theory we have can prove the substitution property of $f$ .

The assumption about the quantifier complexity of $S_{0}$ and $S_{1}$ was barely used. It was just given to us in the type signature for $f$ , and the same proof would have worked without this assumption, so I am confused about why the problem includes this assumption.

[-]GPT26y80

Here's the proof from the paper again:

=s2A < px0,0..p9x0> xx0x0x0x0x0e0..6y0e0x0e0x0e0x0e0e0e0x0e0e0x0e0e0x0.x0e0x0e0e0x0e0e0e0x0e0.x0e0bx<x0e0e0x0e0e0e0e0x0e0.x0e0e0.e0e0.x0e0e0e0e0..2e0e0.x0e0e0e0e0).

So, a proof can't be "s2A" or "s2B" or "s2A" or "s2B" or "s2B" or "s2C" or "worlds" or "possible worlds" or "no known world". But it might well be that the proof is correct enough given the premises.

So we assume the proof is correct!

[-]James Payor6yΩ290

Q7 (Python):

Y = lambda s: eval(s)(s)
Y('lambda s: print("Y = lambda s: eval(s)(s)\\nY({s!r})")')

Q8 (Python):

Not sure about the interpretation of this one. Here's a way to have it work for any fixed (python function) f:

f = 'lambda s: "\\n".join(s.splitlines()[::-1])'

go = 'lambda s: print(eval(f)(eval(s)(s)))'

eval(go)('lambda src: f"f = {f!r}\\ngo = {go!r}\\neval(go)({src!r})"')

[-]Czynski6yΩ290

I am confused by the introductory statement for #9. Is this an accurate rephrasing?

By representing syntax using arithmetic, it is possible to define a function $f$ as follows:

Define $f (s \in S_{1}, t \in S_{1})$ with image in $S_{0}$ , such that:
$f$ substitutes the Goedel-number of $t$ into $s$ (creating $s^{'}$ ) and then substitutes the Goedel-number of $s^{'}$ into some fixed formula to get a result in $S_{0}$ .

[-]Vladimir Mikulik6yΩ240

I’m confused about Q9.

Given the way $S y n (A, B)$ is defined, it’s unclear to me how we ensure type correctness of $S y n (S_{1} \times S_{1}, S_{0})$ . In what sense is $S_{1} \times S_{1}$ a set of sentences (rather than a set of pairs of sentences)? What does an element of that set look like?

[-]Scott Garrabrant6yΩ360

Yeah, it is just functions that take in two sentences and put both their Godel numbers into a fixed formula (with 2 inputs).

[-]seed5y30

Ex 1.

Suppose there is a surjection f : S -> P(S). Consider the set $X = {x \in S | x \notin f (x)}$ . Since f is a surjection, X = f(y) for some y in S. Does y lie in X? If $y \in X$ , then $y \in f (y)$ , so by definition of X, $y \notin X$ . If $y \notin X$ , then $y \notin f (y)$ , so y must belong to X. Contradiction.

Ex 2.

Since there is a function $f : T \to T$ without fixed points, T must have at least two elements. Hence, there is a surjection $s : T \to {0, 1}$ , which induces a surjection $T^{S} \to 2^{S}$ (a function $g : S \to T$ goes to $s \circ g$ ). So, if there were a surjection $S \to T^{S}$ , there would also be a surjection $S \to 2^{S}$ , which cannot be by previous exercise.

Ex 4.

Suppose $f : S \to Comp (S, {T, F})$ is a computable surjective function. Consider the function $g : S \to {T, S}$ defined by $g (s) = \neg f (s) (s)$ . The function g is computable, therefore there should exist an $s^{*} \in S$ : $f (s^{*}) = g$ .

Then $f (s^{*}) (s^{*}) = g (s^{*}) = \neg f (s^{*}) (s^{*})$ . Contradiction.

Ex 5.

Suppose halt(x,y) is a computable function. Consider the function $f : S \to {T, F}$ : $f (s) = \neg s (s) if halt(s,s)$ ; T if $\neg halt (s, s)$

Suppose $s^{'}$ is a Turing code of f. Since f halts everywhere, halt(s', s') = T. But then $s^{'} (s^{'}) = f (s^{'}) = \neg s^{'} (s^{'})$ . Contradiction.

Ex 6.

Suppose that $f : X \to Cont (X, S)$ is a continuous surjection. Consider the function $g \in Cont (X, S)$ $g (x) = - f (x, x)$ (here - f(x, x) is a point diametrically opposed to f(x, x)). f is surjective, hence g = f(y), but then g(y) = f(y,y) = - f(y,y). Contradiction.

Ex 7. A quine in python3:

code = """code = {}{}{}{}{}{}{}
print(code.format('"','"','"',code,'"','"','"'))"""
print(code.format('"','"','"',code,'"','"','"'))

Ex 8. In python:

import inspect
def f(string):
return string[::-1]
def applytoself(f):
source = inspect.getsource(f)
return f(source)
applytoself(f)

'\n]1-::[gnirts nruter \n:)gnirts(f fed'

Ex 9.

The formula for $ψ$ is $\forall x ((x = ┌ ψ ┐) \to ϕ (x))$

Ex 11.

Suppose $ϕ$ is the formula $B e w (x) \to ψ$ . By the diagonal lemma, there exists a formula A such that $⊢ A \leftrightarrow (B e w (A) \to ψ)$ .

Therefore, $⊢ B e w (A \to (B e w (A) \to ψ))$

By property c, $⊢ B e w (A) \to B e w (B e w (A) \to ψ)$

Again by property c, $⊢ B e w (B e w (A) \to ψ) \to (B e w (B e w (A)) \to B e w (ψ))$

Combining previous two implications, $⊢ B e w (A) \to (B e w (B e w (A)) \to B e w (ψ))$

Since $⊢ B e w (A) \to B e w (B e w (A))$ , we have

$⊢ B e w (A) \to B e w (ψ)$

Combining this with $⊢ B e w (ψ) \to ψ$ , we get

$⊢ B e w (A) \to ψ$

From this we get $⊢ A$ , therefore, $⊢ B e w (A)$ and $⊢ ψ$ . QED.

[-]Rafael Harth4y30

Don't know if this is still relevant, but on Ex9

you definitely can't define this way. Your definition includes the godel numeral for $ψ$ , which makes the definition depend on itself.

[-]Mark Xu4y10

Self-referential definitions can be constructed with the diagonal lemma. Given that the point of the exercise is to show something similar, you're right that this solution is probably a bit suspect.

[-]Rafael Harth4y20

I might be wrong, but I believe this is not correct. The diagonal lemma lets you construct a sentence that is logically equivalent to something including its own godel numeral. This is different from having its own godel numeral be part of the syntactic definition.

In particular, the former isn't recursive. It defines one sentence and then, once that sentence is defined, proves something about a second sentence which includes the godel numeral of the first. But what seed attempted (unless I misunderstood it) was to use the godel numeral in the syntactic definition for $ψ$ , which doesn't make sense because $┌ ψ ┐$ is not defined until $ψ$ is.

[-]Czynski6yΩ130

Minor correction for #7: You probably want to say "nonempty quine" or "nontrivial quine". The trivial quine works in many languages.

[-]Czynski6yΩ190

My nontrivial answer for Q7, in Python:

with open("foo.py", "r") as foo:
print foo.read()

And for Q8:

def f(string):
return ''.join([chr(ord(c)+1) for c in string])

with open("foo.py", "r") as foo:
print f(foo.read())

[-]Rafael Harth4y20

Ex8

This was reasonably straight-forward given the quine.

def apply(f):
    l = chr(123) # opening curly bracket
    r = chr(125) # closing curly bracket
    q = chr(39) # single quotation mark
    n = chr(10) # linebreak
    z = [n+"    ", l+f"z[i]"+r+q+n+"        + f"+q]
    x = [n+"        ", l+f"x[i]"+r]
    e = [q, l+"e[i]"+r+q+")"+n+"    print(f(sourcecode))"]
    sourcecode = ""
    for i in range(0,2):
        sourcecode += (f'def apply(f):{z[i]}'
        + f'l = chr(123) # opening curly bracket{z[i]}'
        + f'r = chr(125) # closing curly bracket{z[i]}'
        + f'q = chr(39) # single quotation mark{z[i]}'
        + f'n = chr(10) # linebreak{z[i]}'
        + f'z = [n+"    ", l+f"z[i]"+r+q+n+"        + f"+q]{z[i]}'
        + f'x = [n+"        ", l+f"x[i]"+r]{z[i]}'
        + f'e = [q, l+"e[i]"+r+q+")"+n+"    print(f(sourcecode))"]{z[i]}'
        + f'sourcecode = ""{z[i]}'
        + f'for i in range(0,2):{x[i]}sourcecode += (f{e[i]}')
    print(f(sourcecode))

[-]Rafael Harth4y20

Last time, I got to Ex7. This time, I decided to do them all again before continuing.

Comment on Ex1-6

It gets easy if you just write down what property you want to have in first-order logic.

For example, for Ex1 you want a set that does the following:

$\forall x f (x) \neq A$

now if we consider a set as a function that takes an element and returns true or false, this becomes

$\forall x \exists y f (x) (y) \neq A (y)$

How do you get such a $y$ ? You can just choose $y := x$ , then

$\forall x f (x) (x) \neq A (x)$

and this is done by defining $A (x) := \neg f (x) (x)$ , i.e., $A := {x : x \notin f (x)}$ which is precisely the solution. This almost immediately answers Ex 1,2,4 and it mostly answers Ex6.

Another quine for Ex7, this time in python:

l = chr(123) # opening curly bracket
r = chr(125) # closing curly bracket
q = chr(39) # single quotation mark
t = chr(9) # tab
n = chr(10) # linebreak
z = [n, l+f"z[i]"+r+q+n+t+"+ f"+q]
x = [n+t, l+f"x[i]"+r]
e = [q, l+"e[i]"+r+q+", end="+q+q+")"]
for i in range(0,2):
        print(f'l = chr(123) # opening curly bracket{z[i]}'
        + f'r = chr(125) # closing curly bracket{z[i]}'
        + f'q = chr(39) # single quotation mark{z[i]}'
        + f't = chr(9) # tab{z[i]}'
        + f'n = chr(10) # linebreak{z[i]}'
        + f'z = [n, l+f"z[i]"+r+q+n+t+"+ f"+q]{z[i]}'
        + f'x = [n+t, l+f"x[i]"+r]{z[i]}'
        + f'e = [q, l+"e[i]"+r+q+", end="+q+q+")"]{z[i]}'
        + f'for i in range(0,2):{x[i]}print(f{e[i]}', end='')

[-]closetsolipsist4mo10

Here are my solutions to the first six problems:

1. Recall Cantor’s diagonal argument for the uncountability of the real numbers. Apply the same technique to convince yourself than for any set , the cardinality of $S$ is less than the cardinality of the power set $P (S)$ (i.e. there is no surjection from $S$ to $P (S)$ ).

Solution:

Suppose that $f : S \to P (S)$ is surjective. Then take $A = {s ∣ s \notin f (s)}$ . Since $f$ is surjective, there exists $t \in S$ such that $f (t) = A$ . But then $t \in f (t) \Leftrightarrow t \in A \Leftrightarrow t \notin f (t)$ , a contradiction.

2. Suppose that a nonempty set $T$ has a function $f$ from $T$ to $T$ which lacks fixed points (i.e. $f (x) \neq x$ for all $x \in T$ ). Convince yourself that there is no surjection from S to $S \to T$ , for any nonempty $S$ . (We will write the set of functions from $A$ to $B$ either as $A \to B$ or $B^{A}$ ; these are the same.)

Solution:

Suppose that $g$ were such a surjection. Then we may define a function $h : S \to T$ by $h (s) = (g (s)) (s)$ . Now, since $g$ is surjective, there exists a $u \in S$ such that $g (u) = f \circ h$ . Passing $u$ as an argument to both sides, we have $(g (u)) (u) = f (h (u))$ , so $h (u) = f (h (u))$ , contradicting the fact that $f$ has no fixed points.

3. For nonempty $S$ and $T$ , suppose you are given $g : S \to T^{S}$ a surjective function from the set $S$ to the set of functions from $S$ to $T$ , and let $f$ be a function from $T$ to itself. The previous result implies that there exists an $x$ in $T$ such that $f (x) = x$ . Can you use your proof to describe $x$ in terms of $f$ and $g$ ?

Solution:

Define $h : S \to T$ by $h (s) = (g (s)) (s)$ . Since $g$ is surjective, there exists $u \in S$ such that $g (u) = f \circ h$ . Then take $x = h (u)$ . From my proof above, $x$ is a fixed point of $f$ .

4. Given sets $A$ and $B$ , let $C o m p (A, B)$ denote the space of total computable functions from $A$ to $B$ . We say that a function from $C$ to $C o m p (A, B)$ is computable if and only if the corresponding function $f^{'} : C \times A \to B$ (given by $f^{'} (c, a) = f (c) (a))$ is computable. Show that there is no surjective computable function from the set $S$ of all strings to $C o m p (S, {T, F})$ .

Solution:

Suppose for the sake of contradiction that $f : S \to C o m p (S, {T, F})$ is a surjective computable function. Then the following is computable: $g (u) = \neg f^{'} (u, u)$ . Since $f$ is surjective, there exists $v \in S$ such that $f (v) = g$ , but then $f (v) (v) = g (v) = \neg f^{'} (v, v) = \neg f (v) (v)$ , a contradiction.

5. Show that the previous result implies that there is no computable function $h a l t (x, y)$ from $S \times S \to {T, F}$ which outputs $T$ if and only if the first input is a code for a Turing machine that halts when given the second input.

Suppose for the sake of contradiction that there exists such a computable function $h a l t (x, y)$ . Then define a function $f : S \to C o m p (S, {T, F})$ as follows: for any string $x$ , if $x$ is not a code for a Turing Machine, let $f (x)$ be the function sending all strings to $T$ . If $x$ is a code for a Turing machine, let $f (x)$ be the function $y \mapsto h a l t (x, y)$ . I claim this is a surjective computable function from $S$ to $C o m p (S, {T, F})$ : to show it is surjective, for any computable function $g : S \to {T, F}$ , there is a Turing machine which halts precisely when that function returns $T$ . Letting $x$ be the code for that Turing machine, we then have $f (x) = g$ . It's also computable since we assume $h a l t (x, y)$ is computable. This contradicts the previous result, so we must have been wrong in our initial assumption.

6. Given topological spaces $A$ and $B$ , let $C o n t (A, B)$ be the space with the set of continuous functions from $A$ to $B$ as its underlying set, and with topology such that $f : C \to C o n t (A, B)$ is continuous if and only if the corresponding function $f^{'} : C \times A \to B$ (given by $f^{'} (c, a) = f (c) (a)$ ) is continuous, assuming such a space exists. Convince yourself that there is no space $X$ which continuously surjects onto $C o n t (X, S)$ , where $S$ is the circle.

Suppose for the sake of contradiction that for some space $X$ , $f : X \to C o m p (X, S)$ is a surjective continuous function. Let $o : S \to S$ denote the continuous function giving the point on the opposite side of the circle. Then the following is continuous: $g (x) = o (f^{'} (x, x))$ . Since $f$ is surjective, there exists $y \in X$ such that $f (y) = g$ , but then $f (y) (y) = g (y) = o (f^{'} (y, y)) = o (f (y) (y))$ , a contradiction.

[-]Morphism10mo10

Solution to 8 implemented in python using zero self-reference, where you can replace f with code for any arbitrary function on string x (escaping characters as necessary):

f="x+'\\n'+x"
def ff(x):
return eval(f)
(lambda s : print(ff('f='+chr(34)+f+chr(34)+chr(10)+'def ff(x):'+chr(10)+chr(9)+'return eval(f)'+chr(10)+s+'('+chr(34)+s+chr(34)+')')))("(lambda s : print(ff('f='+chr(34)+f+chr(34)+chr(10)+'def ff(x):'+chr(10)+chr(9)+'return eval(f)'+chr(10)+s+'('+chr(34)+s+chr(34)+')')))")

edit: fixed spoiler tags

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